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postgres/src/backend/replication/logical/decode.c

917 lines
26 KiB

/* -------------------------------------------------------------------------
*
* decode.c
* This module decodes WAL records read using xlogreader.h's APIs for the
* purpose of logical decoding by passing information to the
* reorderbuffer module (containing the actual changes) and to the
* snapbuild module to build a fitting catalog snapshot (to be able to
* properly decode the changes in the reorderbuffer).
*
* NOTE:
* This basically tries to handle all low level xlog stuff for
* reorderbuffer.c and snapbuild.c. There's some minor leakage where a
* specific record's struct is used to pass data along, but those just
* happen to contain the right amount of data in a convenient
* format. There isn't and shouldn't be much intelligence about the
* contents of records in here except turning them into a more usable
* format.
*
* Portions Copyright (c) 1996-2016, PostgreSQL Global Development Group
* Portions Copyright (c) 1994, Regents of the University of California
*
* IDENTIFICATION
* src/backend/replication/logical/decode.c
*
* -------------------------------------------------------------------------
*/
#include "postgres.h"
#include "access/heapam.h"
#include "access/heapam_xlog.h"
#include "access/transam.h"
#include "access/xact.h"
#include "access/xlog_internal.h"
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
#include "access/xlogutils.h"
#include "access/xlogreader.h"
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
#include "access/xlogrecord.h"
#include "catalog/pg_control.h"
#include "replication/decode.h"
#include "replication/logical.h"
#include "replication/reorderbuffer.h"
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
#include "replication/origin.h"
#include "replication/snapbuild.h"
#include "storage/standby.h"
typedef struct XLogRecordBuffer
{
XLogRecPtr origptr;
XLogRecPtr endptr;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *record;
} XLogRecordBuffer;
/* RMGR Handlers */
static void DecodeXLogOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeHeapOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeHeap2Op(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeXactOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeStandbyOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
/* individual record(group)'s handlers */
static void DecodeInsert(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeUpdate(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeDelete(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeMultiInsert(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
static void DecodeSpecConfirm(LogicalDecodingContext *ctx, XLogRecordBuffer *buf);
static void DecodeCommit(LogicalDecodingContext *ctx, XLogRecordBuffer *buf,
xl_xact_parsed_commit *parsed, TransactionId xid);
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
static void DecodeAbort(LogicalDecodingContext *ctx, XLogRecordBuffer *buf,
xl_xact_parsed_abort *parsed, TransactionId xid);
/* common function to decode tuples */
static void DecodeXLogTuple(char *data, Size len, ReorderBufferTupleBuf *tup);
/*
* Take every XLogReadRecord()ed record and perform the actions required to
* decode it using the output plugin already setup in the logical decoding
* context.
*
* NB: Note that every record's xid needs to be processed by reorderbuffer
* (xids contained in the content of records are not relevant for this rule).
* That means that for records which'd otherwise not go through the
* reorderbuffer ReorderBufferProcessXid() has to be called. We don't want to
* call ReorderBufferProcessXid for each record type by default, because
* e.g. empty xacts can be handled more efficiently if there's no previous
* state for them.
*/
void
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
LogicalDecodingProcessRecord(LogicalDecodingContext *ctx, XLogReaderState *record)
{
XLogRecordBuffer buf;
buf.origptr = ctx->reader->ReadRecPtr;
buf.endptr = ctx->reader->EndRecPtr;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
buf.record = record;
/* cast so we get a warning when new rmgrs are added */
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
switch ((RmgrIds) XLogRecGetRmid(record))
{
/*
* Rmgrs we care about for logical decoding. Add new rmgrs in
* rmgrlist.h's order.
*/
case RM_XLOG_ID:
DecodeXLogOp(ctx, &buf);
break;
case RM_XACT_ID:
DecodeXactOp(ctx, &buf);
break;
case RM_STANDBY_ID:
DecodeStandbyOp(ctx, &buf);
break;
case RM_HEAP2_ID:
DecodeHeap2Op(ctx, &buf);
break;
case RM_HEAP_ID:
DecodeHeapOp(ctx, &buf);
break;
/*
* Rmgrs irrelevant for logical decoding; they describe stuff not
* represented in logical decoding. Add new rmgrs in rmgrlist.h's
* order.
*/
case RM_SMGR_ID:
case RM_CLOG_ID:
case RM_DBASE_ID:
case RM_TBLSPC_ID:
case RM_MULTIXACT_ID:
case RM_RELMAP_ID:
case RM_BTREE_ID:
case RM_HASH_ID:
case RM_GIN_ID:
case RM_GIST_ID:
case RM_SEQ_ID:
case RM_SPGIST_ID:
BRIN: Block Range Indexes BRIN is a new index access method intended to accelerate scans of very large tables, without the maintenance overhead of btrees or other traditional indexes. They work by maintaining "summary" data about block ranges. Bitmap index scans work by reading each summary tuple and comparing them with the query quals; all pages in the range are returned in a lossy TID bitmap if the quals are consistent with the values in the summary tuple, otherwise not. Normal index scans are not supported because these indexes do not store TIDs. As new tuples are added into the index, the summary information is updated (if the block range in which the tuple is added is already summarized) or not; in the latter case, a subsequent pass of VACUUM or the brin_summarize_new_values() function will create the summary information. For data types with natural 1-D sort orders, the summary info consists of the maximum and the minimum values of each indexed column within each page range. This type of operator class we call "Minmax", and we supply a bunch of them for most data types with B-tree opclasses. Since the BRIN code is generalized, other approaches are possible for things such as arrays, geometric types, ranges, etc; even for things such as enum types we could do something different than minmax with better results. In this commit I only include minmax. Catalog version bumped due to new builtin catalog entries. There's more that could be done here, but this is a good step forwards. Loosely based on ideas from Simon Riggs; code mostly by Álvaro Herrera, with contribution by Heikki Linnakangas. Patch reviewed by: Amit Kapila, Heikki Linnakangas, Robert Haas. Testing help from Jeff Janes, Erik Rijkers, Emanuel Calvo. PS: The research leading to these results has received funding from the European Union's Seventh Framework Programme (FP7/2007-2013) under grant agreement n° 318633.
11 years ago
case RM_BRIN_ID:
case RM_COMMIT_TS_ID:
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
case RM_REPLORIGIN_ID:
/* just deal with xid, and done */
ReorderBufferProcessXid(ctx->reorder, XLogRecGetXid(record),
buf.origptr);
break;
case RM_NEXT_ID:
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
elog(ERROR, "unexpected RM_NEXT_ID rmgr_id: %u", (RmgrIds) XLogRecGetRmid(buf.record));
}
}
/*
* Handle rmgr XLOG_ID records for DecodeRecordIntoReorderBuffer().
*/
static void
DecodeXLogOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
SnapBuild *builder = ctx->snapshot_builder;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
uint8 info = XLogRecGetInfo(buf->record) & ~XLR_INFO_MASK;
ReorderBufferProcessXid(ctx->reorder, XLogRecGetXid(buf->record),
buf->origptr);
switch (info)
{
/* this is also used in END_OF_RECOVERY checkpoints */
case XLOG_CHECKPOINT_SHUTDOWN:
case XLOG_END_OF_RECOVERY:
SnapBuildSerializationPoint(builder, buf->origptr);
break;
case XLOG_CHECKPOINT_ONLINE:
/*
* a RUNNING_XACTS record will have been logged near to this, we
* can restart from there.
*/
break;
case XLOG_NOOP:
case XLOG_NEXTOID:
case XLOG_SWITCH:
case XLOG_BACKUP_END:
case XLOG_PARAMETER_CHANGE:
case XLOG_RESTORE_POINT:
case XLOG_FPW_CHANGE:
case XLOG_FPI_FOR_HINT:
case XLOG_FPI:
break;
default:
elog(ERROR, "unexpected RM_XLOG_ID record type: %u", info);
}
}
/*
* Handle rmgr XACT_ID records for DecodeRecordIntoReorderBuffer().
*/
static void
DecodeXactOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
SnapBuild *builder = ctx->snapshot_builder;
ReorderBuffer *reorder = ctx->reorder;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
uint8 info = XLogRecGetInfo(r) & XLOG_XACT_OPMASK;
/*
* No point in doing anything yet, data could not be decoded anyway. It's
* ok not to call ReorderBufferProcessXid() in that case, except in the
* assignment case there'll not be any later records with the same xid;
* and in the assignment case we'll not decode those xacts.
*/
if (SnapBuildCurrentState(builder) < SNAPBUILD_FULL_SNAPSHOT)
return;
switch (info)
{
case XLOG_XACT_COMMIT:
case XLOG_XACT_COMMIT_PREPARED:
{
xl_xact_commit *xlrec;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
xl_xact_parsed_commit parsed;
TransactionId xid;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
xlrec = (xl_xact_commit *) XLogRecGetData(r);
ParseCommitRecord(XLogRecGetInfo(buf->record), xlrec, &parsed);
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
if (!TransactionIdIsValid(parsed.twophase_xid))
xid = XLogRecGetXid(r);
else
xid = parsed.twophase_xid;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
DecodeCommit(ctx, buf, &parsed, xid);
break;
}
case XLOG_XACT_ABORT:
case XLOG_XACT_ABORT_PREPARED:
{
xl_xact_abort *xlrec;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
xl_xact_parsed_abort parsed;
TransactionId xid;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
xlrec = (xl_xact_abort *) XLogRecGetData(r);
ParseAbortRecord(XLogRecGetInfo(buf->record), xlrec, &parsed);
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
if (!TransactionIdIsValid(parsed.twophase_xid))
xid = XLogRecGetXid(r);
else
xid = parsed.twophase_xid;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
DecodeAbort(ctx, buf, &parsed, xid);
break;
}
case XLOG_XACT_ASSIGNMENT:
{
xl_xact_assignment *xlrec;
int i;
TransactionId *sub_xid;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_xact_assignment *) XLogRecGetData(r);
sub_xid = &xlrec->xsub[0];
for (i = 0; i < xlrec->nsubxacts; i++)
{
ReorderBufferAssignChild(reorder, xlrec->xtop,
*(sub_xid++), buf->origptr);
}
break;
}
case XLOG_XACT_PREPARE:
/*
* Currently decoding ignores PREPARE TRANSACTION and will just
* decode the transaction when the COMMIT PREPARED is sent or
* throw away the transaction's contents when a ROLLBACK PREPARED
* is received. In the future we could add code to expose prepared
* transactions in the changestream allowing for a kind of
* distributed 2PC.
*/
ReorderBufferProcessXid(reorder, XLogRecGetXid(r), buf->origptr);
break;
default:
elog(ERROR, "unexpected RM_XACT_ID record type: %u", info);
}
}
/*
* Handle rmgr STANDBY_ID records for DecodeRecordIntoReorderBuffer().
*/
static void
DecodeStandbyOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
SnapBuild *builder = ctx->snapshot_builder;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
uint8 info = XLogRecGetInfo(r) & ~XLR_INFO_MASK;
ReorderBufferProcessXid(ctx->reorder, XLogRecGetXid(r), buf->origptr);
switch (info)
{
case XLOG_RUNNING_XACTS:
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xl_running_xacts *running = (xl_running_xacts *) XLogRecGetData(r);
SnapBuildProcessRunningXacts(builder, buf->origptr, running);
/*
* Abort all transactions that we keep track of, that are
* older than the record's oldestRunningXid. This is the most
* convenient spot for doing so since, in contrast to shutdown
* or end-of-recovery checkpoints, we have information about
* all running transactions which includes prepared ones,
* while shutdown checkpoints just know that no non-prepared
* transactions are in progress.
*/
ReorderBufferAbortOld(ctx->reorder, running->oldestRunningXid);
}
break;
case XLOG_STANDBY_LOCK:
break;
default:
elog(ERROR, "unexpected RM_STANDBY_ID record type: %u", info);
}
}
/*
* Handle rmgr HEAP2_ID records for DecodeRecordIntoReorderBuffer().
*/
static void
DecodeHeap2Op(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
uint8 info = XLogRecGetInfo(buf->record) & XLOG_HEAP_OPMASK;
TransactionId xid = XLogRecGetXid(buf->record);
SnapBuild *builder = ctx->snapshot_builder;
ReorderBufferProcessXid(ctx->reorder, xid, buf->origptr);
/* no point in doing anything yet */
if (SnapBuildCurrentState(builder) < SNAPBUILD_FULL_SNAPSHOT)
return;
switch (info)
{
case XLOG_HEAP2_MULTI_INSERT:
if (SnapBuildProcessChange(builder, xid, buf->origptr))
DecodeMultiInsert(ctx, buf);
break;
case XLOG_HEAP2_NEW_CID:
{
xl_heap_new_cid *xlrec;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_heap_new_cid *) XLogRecGetData(buf->record);
SnapBuildProcessNewCid(builder, xid, buf->origptr, xlrec);
break;
}
case XLOG_HEAP2_REWRITE:
/*
* Although these records only exist to serve the needs of logical
* decoding, all the work happens as part of crash or archive
* recovery, so we don't need to do anything here.
*/
break;
/*
* Everything else here is just low level physical stuff we're not
* interested in.
*/
case XLOG_HEAP2_FREEZE_PAGE:
case XLOG_HEAP2_CLEAN:
case XLOG_HEAP2_CLEANUP_INFO:
case XLOG_HEAP2_VISIBLE:
case XLOG_HEAP2_LOCK_UPDATED:
break;
default:
elog(ERROR, "unexpected RM_HEAP2_ID record type: %u", info);
}
}
/*
* Handle rmgr HEAP_ID records for DecodeRecordIntoReorderBuffer().
*/
static void
DecodeHeapOp(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
uint8 info = XLogRecGetInfo(buf->record) & XLOG_HEAP_OPMASK;
TransactionId xid = XLogRecGetXid(buf->record);
SnapBuild *builder = ctx->snapshot_builder;
ReorderBufferProcessXid(ctx->reorder, xid, buf->origptr);
/* no point in doing anything yet */
if (SnapBuildCurrentState(builder) < SNAPBUILD_FULL_SNAPSHOT)
return;
switch (info)
{
case XLOG_HEAP_INSERT:
if (SnapBuildProcessChange(builder, xid, buf->origptr))
DecodeInsert(ctx, buf);
break;
/*
* Treat HOT update as normal updates. There is no useful
* information in the fact that we could make it a HOT update
* locally and the WAL layout is compatible.
*/
case XLOG_HEAP_HOT_UPDATE:
case XLOG_HEAP_UPDATE:
if (SnapBuildProcessChange(builder, xid, buf->origptr))
DecodeUpdate(ctx, buf);
break;
case XLOG_HEAP_DELETE:
if (SnapBuildProcessChange(builder, xid, buf->origptr))
DecodeDelete(ctx, buf);
break;
case XLOG_HEAP_INPLACE:
/*
* Inplace updates are only ever performed on catalog tuples and
* can, per definition, not change tuple visibility. Since we
* don't decode catalog tuples, we're not interested in the
* record's contents.
*
* In-place updates can be used either by XID-bearing transactions
* (e.g. in CREATE INDEX CONCURRENTLY) or by XID-less
* transactions (e.g. VACUUM). In the former case, the commit
* record will include cache invalidations, so we mark the
* transaction as catalog modifying here. Currently that's
* redundant because the commit will do that as well, but once we
* support decoding in-progress relations, this will be important.
*/
if (!TransactionIdIsValid(xid))
break;
SnapBuildProcessChange(builder, xid, buf->origptr);
ReorderBufferXidSetCatalogChanges(ctx->reorder, xid, buf->origptr);
break;
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
case XLOG_HEAP_CONFIRM:
if (SnapBuildProcessChange(builder, xid, buf->origptr))
DecodeSpecConfirm(ctx, buf);
break;
case XLOG_HEAP_LOCK:
/* we don't care about row level locks for now */
break;
default:
elog(ERROR, "unexpected RM_HEAP_ID record type: %u", info);
break;
}
}
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
static inline bool
FilterByOrigin(LogicalDecodingContext *ctx, RepOriginId origin_id)
{
if (ctx->callbacks.filter_by_origin_cb == NULL)
return false;
return filter_by_origin_cb_wrapper(ctx, origin_id);
}
/*
* Consolidated commit record handling between the different form of commit
* records.
*/
static void
DecodeCommit(LogicalDecodingContext *ctx, XLogRecordBuffer *buf,
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
xl_xact_parsed_commit *parsed, TransactionId xid)
{
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
XLogRecPtr origin_lsn = InvalidXLogRecPtr;
TimestampTz commit_time = parsed->xact_time;
XLogRecPtr origin_id = XLogRecGetOrigin(buf->record);
int i;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
if (parsed->xinfo & XACT_XINFO_HAS_ORIGIN)
{
origin_lsn = parsed->origin_lsn;
commit_time = parsed->origin_timestamp;
}
/*
* Process invalidation messages, even if we're not interested in the
* transaction's contents, since the various caches need to always be
* consistent.
*/
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
if (parsed->nmsgs > 0)
{
ReorderBufferAddInvalidations(ctx->reorder, xid, buf->origptr,
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
parsed->nmsgs, parsed->msgs);
ReorderBufferXidSetCatalogChanges(ctx->reorder, xid, buf->origptr);
}
SnapBuildCommitTxn(ctx->snapshot_builder, buf->origptr, xid,
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
parsed->nsubxacts, parsed->subxacts);
/* ----
* Check whether we are interested in this specific transaction, and tell
* the reorderbuffer to forget the content of the (sub-)transactions
* if not.
*
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
* There can be several reasons we might not be interested in this
* transaction:
* 1) We might not be interested in decoding transactions up to this
* LSN. This can happen because we previously decoded it and now just
* are restarting or if we haven't assembled a consistent snapshot yet.
* 2) The transaction happened in another database.
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
* 3) The output plugin is not interested in the origin.
*
* We can't just use ReorderBufferAbort() here, because we need to execute
* the transaction's invalidations. This currently won't be needed if
* we're just skipping over the transaction because currently we only do
* so during startup, to get to the first transaction the client needs. As
* we have reset the catalog caches before starting to read WAL, and we
* haven't yet touched any catalogs, there can't be anything to invalidate.
* But if we're "forgetting" this commit because it's it happened in
* another database, the invalidations might be important, because they
* could be for shared catalogs and we might have loaded data into the
* relevant syscaches.
* ---
*/
if (SnapBuildXactNeedsSkip(ctx->snapshot_builder, buf->origptr) ||
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
(parsed->dbId != InvalidOid && parsed->dbId != ctx->slot->data.database) ||
FilterByOrigin(ctx, origin_id))
{
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
for (i = 0; i < parsed->nsubxacts; i++)
{
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
ReorderBufferForget(ctx->reorder, parsed->subxacts[i], buf->origptr);
}
ReorderBufferForget(ctx->reorder, xid, buf->origptr);
return;
}
/* tell the reorderbuffer about the surviving subtransactions */
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
for (i = 0; i < parsed->nsubxacts; i++)
{
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
ReorderBufferCommitChild(ctx->reorder, xid, parsed->subxacts[i],
buf->origptr, buf->endptr);
}
/* replay actions of all transaction + subtransactions in order */
ReorderBufferCommit(ctx->reorder, xid, buf->origptr, buf->endptr,
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
commit_time, origin_id, origin_lsn);
}
/*
* Get the data from the various forms of abort records and pass it on to
* snapbuild.c and reorderbuffer.c
*/
static void
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
DecodeAbort(LogicalDecodingContext *ctx, XLogRecordBuffer *buf,
xl_xact_parsed_abort *parsed, TransactionId xid)
{
int i;
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
SnapBuildAbortTxn(ctx->snapshot_builder, buf->record->EndRecPtr, xid,
parsed->nsubxacts, parsed->subxacts);
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
for (i = 0; i < parsed->nsubxacts; i++)
{
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
ReorderBufferAbort(ctx->reorder, parsed->subxacts[i],
buf->record->EndRecPtr);
}
Merge the various forms of transaction commit & abort records. Since 465883b0a two versions of commit records have existed. A compact version that was used when no cache invalidations, smgr unlinks and similar were needed, and a full version that could deal with all that. Additionally the full version was embedded into twophase commit records. That resulted in a measurable reduction in the size of the logged WAL in some workloads. But more recently additions like logical decoding, which e.g. needs information about the database something was executed on, made it applicable in fewer situations. The static split generally made it hard to expand the commit record, because concerns over the size made it hard to add anything to the compact version. Additionally it's not particularly pretty to have twophase.c insert RM_XACT records. Rejigger things so that the commit and abort records only have one form each, including the twophase equivalents. The presence of the various optional (in the sense of not being in every record) pieces is indicated by a bits in the 'xinfo' flag. That flag previously was not included in compact commit records. To prevent an increase in size due to its presence, it's only included if necessary; signalled by a bit in the xl_info bits available for xact.c, similar to heapam.c's XLOG_HEAP_OPMASK/XLOG_HEAP_INIT_PAGE. Twophase commit/aborts are now the same as their normal counterparts. The original transaction's xid is included in an optional data field. This means that commit records generally are smaller, except in the case of a transaction with subtransactions, but no other special cases; the increase there is four bytes, which seems acceptable given that the more common case of not having subtransactions shrank. The savings are especially measurable for twophase commits, which previously always used the full version; but will in practice only infrequently have required that. The motivation for this work are not the space savings and and deduplication though; it's that it makes it easier to extend commit records with additional information. That's just a few lines of code now; without impacting the common case where that information is not needed. Discussion: 20150220152150.GD4149@awork2.anarazel.de, 235610.92468.qm%40web29004.mail.ird.yahoo.com Reviewed-By: Heikki Linnakangas, Simon Riggs
11 years ago
ReorderBufferAbort(ctx->reorder, xid, buf->record->EndRecPtr);
}
/*
* Parse XLOG_HEAP_INSERT (not MULTI_INSERT!) records into tuplebufs.
*
* Deletes can contain the new tuple.
*/
static void
DecodeInsert(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
xl_heap_insert *xlrec;
ReorderBufferChange *change;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
RelFileNode target_node;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_heap_insert *) XLogRecGetData(r);
/* only interested in our database */
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogRecGetBlockTag(r, 0, &target_node, NULL, NULL);
if (target_node.dbNode != ctx->slot->data.database)
return;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
/* output plugin doesn't look for this origin, no need to queue */
if (FilterByOrigin(ctx, XLogRecGetOrigin(r)))
return;
change = ReorderBufferGetChange(ctx->reorder);
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (!(xlrec->flags & XLH_INSERT_IS_SPECULATIVE))
change->action = REORDER_BUFFER_CHANGE_INSERT;
else
change->action = REORDER_BUFFER_CHANGE_INTERNAL_SPEC_INSERT;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
change->origin_id = XLogRecGetOrigin(r);
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
memcpy(&change->data.tp.relnode, &target_node, sizeof(RelFileNode));
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_INSERT_CONTAINS_NEW_TUPLE)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
Size tuplelen;
char *tupledata = XLogRecGetBlockData(r, 0, &tuplelen);
change->data.tp.newtuple =
ReorderBufferGetTupleBuf(ctx->reorder, tuplelen);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
DecodeXLogTuple(tupledata, tuplelen, change->data.tp.newtuple);
}
change->data.tp.clear_toast_afterwards = true;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
ReorderBufferQueueChange(ctx->reorder, XLogRecGetXid(r), buf->origptr, change);
}
/*
* Parse XLOG_HEAP_UPDATE and XLOG_HEAP_HOT_UPDATE, which have the same layout
* in the record, from wal into proper tuplebufs.
*
* Updates can possibly contain a new tuple and the old primary key.
*/
static void
DecodeUpdate(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
xl_heap_update *xlrec;
ReorderBufferChange *change;
char *data;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
Size datalen;
RelFileNode target_node;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_heap_update *) XLogRecGetData(r);
/* only interested in our database */
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogRecGetBlockTag(r, 0, &target_node, NULL, NULL);
if (target_node.dbNode != ctx->slot->data.database)
return;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
/* output plugin doesn't look for this origin, no need to queue */
if (FilterByOrigin(ctx, XLogRecGetOrigin(r)))
return;
change = ReorderBufferGetChange(ctx->reorder);
change->action = REORDER_BUFFER_CHANGE_UPDATE;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
change->origin_id = XLogRecGetOrigin(r);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
memcpy(&change->data.tp.relnode, &target_node, sizeof(RelFileNode));
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_UPDATE_CONTAINS_NEW_TUPLE)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
data = XLogRecGetBlockData(r, 0, &datalen);
change->data.tp.newtuple =
ReorderBufferGetTupleBuf(ctx->reorder, datalen);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
DecodeXLogTuple(data, datalen, change->data.tp.newtuple);
}
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_UPDATE_CONTAINS_OLD)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
/* caution, remaining data in record is not aligned */
data = XLogRecGetData(r) + SizeOfHeapUpdate;
datalen = XLogRecGetDataLen(r) - SizeOfHeapUpdate;
change->data.tp.oldtuple =
ReorderBufferGetTupleBuf(ctx->reorder, datalen);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
DecodeXLogTuple(data, datalen, change->data.tp.oldtuple);
}
change->data.tp.clear_toast_afterwards = true;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
ReorderBufferQueueChange(ctx->reorder, XLogRecGetXid(r), buf->origptr, change);
}
/*
* Parse XLOG_HEAP_DELETE from wal into proper tuplebufs.
*
* Deletes can possibly contain the old primary key.
*/
static void
DecodeDelete(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
xl_heap_delete *xlrec;
ReorderBufferChange *change;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
RelFileNode target_node;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_heap_delete *) XLogRecGetData(r);
/* only interested in our database */
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogRecGetBlockTag(r, 0, &target_node, NULL, NULL);
if (target_node.dbNode != ctx->slot->data.database)
return;
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
/*
* Super deletions are irrelevant for logical decoding, it's driven by the
* confirmation records.
*/
if (xlrec->flags & XLH_DELETE_IS_SUPER)
return;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
/* output plugin doesn't look for this origin, no need to queue */
if (FilterByOrigin(ctx, XLogRecGetOrigin(r)))
return;
change = ReorderBufferGetChange(ctx->reorder);
change->action = REORDER_BUFFER_CHANGE_DELETE;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
change->origin_id = XLogRecGetOrigin(r);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
memcpy(&change->data.tp.relnode, &target_node, sizeof(RelFileNode));
/* old primary key stored */
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_DELETE_CONTAINS_OLD)
{
Size len = XLogRecGetDataLen(r) - SizeOfHeapDelete;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
Assert(XLogRecGetDataLen(r) > (SizeOfHeapDelete + SizeOfHeapHeader));
change->data.tp.oldtuple =
ReorderBufferGetTupleBuf(ctx->reorder, len);
DecodeXLogTuple((char *) xlrec + SizeOfHeapDelete,
len, change->data.tp.oldtuple);
}
change->data.tp.clear_toast_afterwards = true;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
ReorderBufferQueueChange(ctx->reorder, XLogRecGetXid(r), buf->origptr, change);
}
/*
* Decode XLOG_HEAP2_MULTI_INSERT_insert record into multiple tuplebufs.
*
* Currently MULTI_INSERT will always contain the full tuples.
*/
static void
DecodeMultiInsert(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogReaderState *r = buf->record;
xl_heap_multi_insert *xlrec;
int i;
char *data;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
char *tupledata;
Size tuplelen;
RelFileNode rnode;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
xlrec = (xl_heap_multi_insert *) XLogRecGetData(r);
/* only interested in our database */
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
XLogRecGetBlockTag(r, 0, &rnode, NULL, NULL);
if (rnode.dbNode != ctx->slot->data.database)
return;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
/* output plugin doesn't look for this origin, no need to queue */
if (FilterByOrigin(ctx, XLogRecGetOrigin(r)))
return;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
tupledata = XLogRecGetBlockData(r, 0, &tuplelen);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
data = tupledata;
for (i = 0; i < xlrec->ntuples; i++)
{
ReorderBufferChange *change;
xl_multi_insert_tuple *xlhdr;
int datalen;
ReorderBufferTupleBuf *tuple;
change = ReorderBufferGetChange(ctx->reorder);
change->action = REORDER_BUFFER_CHANGE_INSERT;
Introduce replication progress tracking infrastructure. When implementing a replication solution ontop of logical decoding, two related problems exist: * How to safely keep track of replication progress * How to change replication behavior, based on the origin of a row; e.g. to avoid loops in bi-directional replication setups The solution to these problems, as implemented here, consist out of three parts: 1) 'replication origins', which identify nodes in a replication setup. 2) 'replication progress tracking', which remembers, for each replication origin, how far replay has progressed in a efficient and crash safe manner. 3) The ability to filter out changes performed on the behest of a replication origin during logical decoding; this allows complex replication topologies. E.g. by filtering all replayed changes out. Most of this could also be implemented in "userspace", e.g. by inserting additional rows contain origin information, but that ends up being much less efficient and more complicated. We don't want to require various replication solutions to reimplement logic for this independently. The infrastructure is intended to be generic enough to be reusable. This infrastructure also replaces the 'nodeid' infrastructure of commit timestamps. It is intended to provide all the former capabilities, except that there's only 2^16 different origins; but now they integrate with logical decoding. Additionally more functionality is accessible via SQL. Since the commit timestamp infrastructure has also been introduced in 9.5 (commit 73c986add) changing the API is not a problem. For now the number of origins for which the replication progress can be tracked simultaneously is determined by the max_replication_slots GUC. That GUC is not a perfect match to configure this, but there doesn't seem to be sufficient reason to introduce a separate new one. Bumps both catversion and wal page magic. Author: Andres Freund, with contributions from Petr Jelinek and Craig Ringer Reviewed-By: Heikki Linnakangas, Petr Jelinek, Robert Haas, Steve Singer Discussion: 20150216002155.GI15326@awork2.anarazel.de, 20140923182422.GA15776@alap3.anarazel.de, 20131114172632.GE7522@alap2.anarazel.de
11 years ago
change->origin_id = XLogRecGetOrigin(r);
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
memcpy(&change->data.tp.relnode, &rnode, sizeof(RelFileNode));
/*
* CONTAINS_NEW_TUPLE will always be set currently as multi_insert
* isn't used for catalogs, but better be future proof.
*
* We decode the tuple in pretty much the same way as DecodeXLogTuple,
* but since the layout is slightly different, we can't use it here.
*/
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_INSERT_CONTAINS_NEW_TUPLE)
{
HeapTupleHeader header;
xlhdr = (xl_multi_insert_tuple *) SHORTALIGN(data);
data = ((char *) xlhdr) + SizeOfMultiInsertTuple;
datalen = xlhdr->datalen;
change->data.tp.newtuple =
ReorderBufferGetTupleBuf(ctx->reorder, datalen);
tuple = change->data.tp.newtuple;
header = tuple->tuple.t_data;
/* not a disk based tuple */
ItemPointerSetInvalid(&tuple->tuple.t_self);
/*
* We can only figure this out after reassembling the
* transactions.
*/
tuple->tuple.t_tableOid = InvalidOid;
tuple->tuple.t_len = datalen + SizeofHeapTupleHeader;
memset(header, 0, SizeofHeapTupleHeader);
memcpy((char *) tuple->tuple.t_data + SizeofHeapTupleHeader,
(char *) data,
datalen);
data += datalen;
header->t_infomask = xlhdr->t_infomask;
header->t_infomask2 = xlhdr->t_infomask2;
header->t_hoff = xlhdr->t_hoff;
}
/*
* Reset toast reassembly state only after the last row in the last
* xl_multi_insert_tuple record emitted by one heap_multi_insert()
* call.
*/
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
if (xlrec->flags & XLH_INSERT_LAST_IN_MULTI &&
(i + 1) == xlrec->ntuples)
change->data.tp.clear_toast_afterwards = true;
else
change->data.tp.clear_toast_afterwards = false;
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
ReorderBufferQueueChange(ctx->reorder, XLogRecGetXid(r),
buf->origptr, change);
}
Revamp the WAL record format. Each WAL record now carries information about the modified relation and block(s) in a standardized format. That makes it easier to write tools that need that information, like pg_rewind, prefetching the blocks to speed up recovery, etc. There's a whole new API for building WAL records, replacing the XLogRecData chains used previously. The new API consists of XLogRegister* functions, which are called for each buffer and chunk of data that is added to the record. The new API also gives more control over when a full-page image is written, by passing flags to the XLogRegisterBuffer function. This also simplifies the XLogReadBufferForRedo() calls. The function can dig the relation and block number from the WAL record, so they no longer need to be passed as arguments. For the convenience of redo routines, XLogReader now disects each WAL record after reading it, copying the main data part and the per-block data into MAXALIGNed buffers. The data chunks are not aligned within the WAL record, but the redo routines can assume that the pointers returned by XLogRecGet* functions are. Redo routines are now passed the XLogReaderState, which contains the record in the already-disected format, instead of the plain XLogRecord. The new record format also makes the fixed size XLogRecord header smaller, by removing the xl_len field. The length of the "main data" portion is now stored at the end of the WAL record, and there's a separate header after XLogRecord for it. The alignment padding at the end of XLogRecord is also removed. This compansates for the fact that the new format would otherwise be more bulky than the old format. Reviewed by Andres Freund, Amit Kapila, Michael Paquier, Alvaro Herrera, Fujii Masao.
11 years ago
Assert(data == tupledata + tuplelen);
}
Add support for INSERT ... ON CONFLICT DO NOTHING/UPDATE. The newly added ON CONFLICT clause allows to specify an alternative to raising a unique or exclusion constraint violation error when inserting. ON CONFLICT refers to constraints that can either be specified using a inference clause (by specifying the columns of a unique constraint) or by naming a unique or exclusion constraint. DO NOTHING avoids the constraint violation, without touching the pre-existing row. DO UPDATE SET ... [WHERE ...] updates the pre-existing tuple, and has access to both the tuple proposed for insertion and the existing tuple; the optional WHERE clause can be used to prevent an update from being executed. The UPDATE SET and WHERE clauses have access to the tuple proposed for insertion using the "magic" EXCLUDED alias, and to the pre-existing tuple using the table name or its alias. This feature is often referred to as upsert. This is implemented using a new infrastructure called "speculative insertion". It is an optimistic variant of regular insertion that first does a pre-check for existing tuples and then attempts an insert. If a violating tuple was inserted concurrently, the speculatively inserted tuple is deleted and a new attempt is made. If the pre-check finds a matching tuple the alternative DO NOTHING or DO UPDATE action is taken. If the insertion succeeds without detecting a conflict, the tuple is deemed inserted. To handle the possible ambiguity between the excluded alias and a table named excluded, and for convenience with long relation names, INSERT INTO now can alias its target table. Bumps catversion as stored rules change. Author: Peter Geoghegan, with significant contributions from Heikki Linnakangas and Andres Freund. Testing infrastructure by Jeff Janes. Reviewed-By: Heikki Linnakangas, Andres Freund, Robert Haas, Simon Riggs, Dean Rasheed, Stephen Frost and many others.
11 years ago
/*
* Parse XLOG_HEAP_CONFIRM from wal into a confirmation change.
*
* This is pretty trivial, all the state essentially already setup by the
* speculative insertion.
*/
static void
DecodeSpecConfirm(LogicalDecodingContext *ctx, XLogRecordBuffer *buf)
{
XLogReaderState *r = buf->record;
ReorderBufferChange *change;
RelFileNode target_node;
/* only interested in our database */
XLogRecGetBlockTag(r, 0, &target_node, NULL, NULL);
if (target_node.dbNode != ctx->slot->data.database)
return;
/* output plugin doesn't look for this origin, no need to queue */
if (FilterByOrigin(ctx, XLogRecGetOrigin(r)))
return;
change = ReorderBufferGetChange(ctx->reorder);
change->action = REORDER_BUFFER_CHANGE_INTERNAL_SPEC_CONFIRM;
change->origin_id = XLogRecGetOrigin(r);
memcpy(&change->data.tp.relnode, &target_node, sizeof(RelFileNode));
change->data.tp.clear_toast_afterwards = true;
ReorderBufferQueueChange(ctx->reorder, XLogRecGetXid(r), buf->origptr, change);
}
/*
* Read a HeapTuple as WAL logged by heap_insert, heap_update and heap_delete
* (but not by heap_multi_insert) into a tuplebuf.
*
* The size 'len' and the pointer 'data' in the record need to be
* computed outside as they are record specific.
*/
static void
DecodeXLogTuple(char *data, Size len, ReorderBufferTupleBuf *tuple)
{
xl_heap_header xlhdr;
int datalen = len - SizeOfHeapHeader;
HeapTupleHeader header;
Assert(datalen >= 0);
tuple->tuple.t_len = datalen + SizeofHeapTupleHeader;
header = tuple->tuple.t_data;
/* not a disk based tuple */
ItemPointerSetInvalid(&tuple->tuple.t_self);
/* we can only figure this out after reassembling the transactions */
tuple->tuple.t_tableOid = InvalidOid;
/* data is not stored aligned, copy to aligned storage */
memcpy((char *) &xlhdr,
data,
SizeOfHeapHeader);
memset(header, 0, SizeofHeapTupleHeader);
memcpy(((char *) tuple->tuple.t_data) + SizeofHeapTupleHeader,
data + SizeOfHeapHeader,
datalen);
header->t_infomask = xlhdr.t_infomask;
header->t_infomask2 = xlhdr.t_infomask2;
header->t_hoff = xlhdr.t_hoff;
}