/*
* lazy_vacuum_page() -- free dead tuples on a page
* and repair its fragmentation.
*
* Caller must hold pin and buffer cleanup lock on the buffer.
*
* tupindex is the index in vacrelstats->dead_tuples of the first dead
* tuple for this page. We assume the rest follow sequentially.
* The return value is the first tupindex after the tuples of this page.
*/
static int
lazy_vacuum_page(Relation onerel, BlockNumber blkno, Buffer buffer,
int tupindex, LVRelStats *vacrelstats)
{
OffsetNumber unused[MaxOffsetNumber];
int uncnt;
Page page = BufferGetPage(buffer);
ItemId itemid;
MIRROREDLOCK_BUFMGR_MUST_ALREADY_BE_HELD;
START_CRIT_SECTION();
for (; tupindex < vacrelstats->num_dead_tuples; tupindex++)
{
BlockNumber tblk;
OffsetNumber toff;
tblk = ItemPointerGetBlockNumber(&vacrelstats->dead_tuples[tupindex]);
if (tblk != blkno)
break; /* past end of tuples for this block */
toff = ItemPointerGetOffsetNumber(&vacrelstats->dead_tuples[tupindex]);
itemid = PageGetItemId(page, toff);
itemid->lp_flags &= ~LP_USED;
}
uncnt = PageRepairFragmentation(page, unused);
MarkBufferDirty(buffer);
/* XLOG stuff */
if (!onerel->rd_istemp)
{
XLogRecPtr recptr;
recptr = log_heap_clean(onerel, buffer, unused, uncnt);
PageSetLSN(page, recptr);
PageSetTLI(page, ThisTimeLineID);
}
else
{
/* No XLOG record, but still need to flag that XID exists on disk */
MyXactMadeTempRelUpdate = true;
}
END_CRIT_SECTION();
return tupindex;
}
/*
* lazy_vacuum_page() -- free dead tuples on a page
* and repair its fragmentation.
*
* Caller must hold pin and buffer cleanup lock on the buffer.
*
* tupindex is the index in vacrelstats->dead_tuples of the first dead
* tuple for this page. We assume the rest follow sequentially.
* The return value is the first tupindex after the tuples of this page.
*/
static int
lazy_vacuum_page(Relation onerel, BlockNumber blkno, Buffer buffer,
int tupindex, LVRelStats *vacrelstats)
{
Page page = BufferGetPage(buffer);
OffsetNumber unused[MaxOffsetNumber];
int uncnt = 0;
MIRROREDLOCK_BUFMGR_MUST_ALREADY_BE_HELD;
START_CRIT_SECTION();
for (; tupindex < vacrelstats->num_dead_tuples; tupindex++)
{
BlockNumber tblk;
OffsetNumber toff;
ItemId itemid;
tblk = ItemPointerGetBlockNumber(&vacrelstats->dead_tuples[tupindex]);
if (tblk != blkno)
break; /* past end of tuples for this block */
toff = ItemPointerGetOffsetNumber(&vacrelstats->dead_tuples[tupindex]);
itemid = PageGetItemId(page, toff);
ItemIdSetUnused(itemid);
unused[uncnt++] = toff;
}
PageRepairFragmentation(page);
MarkBufferDirty(buffer);
/* XLOG stuff */
if (!onerel->rd_istemp)
{
XLogRecPtr recptr;
recptr = log_heap_clean(onerel, buffer,
NULL, 0, NULL, 0,
unused, uncnt,
false);
PageSetLSN(page, recptr);
PageSetTLI(page, ThisTimeLineID);
}
END_CRIT_SECTION();
return tupindex;
}
/*
* Prune and repair fragmentation in the specified page.
*
* Caller must have pin and buffer cleanup lock on the page.
*
* OldestXmin is the cutoff XID used to distinguish whether tuples are DEAD
* or RECENTLY_DEAD (see HeapTupleSatisfiesVacuum).
*
* If redirect_move is set, we remove redirecting line pointers by
* updating the root line pointer to point directly to the first non-dead
* tuple in the chain. NOTE: eliminating the redirect changes the first
* tuple's effective CTID, and is therefore unsafe except within VACUUM FULL.
* The only reason we support this capability at all is that by using it,
* VACUUM FULL need not cope with LP_REDIRECT items at all; which seems a
* good thing since VACUUM FULL is overly complicated already.
*
* If report_stats is true then we send the number of reclaimed heap-only
* tuples to pgstats. (This must be FALSE during vacuum, since vacuum will
* send its own new total to pgstats, and we don't want this delta applied
* on top of that.)
*
* Returns the number of tuples deleted from the page.
*/
int
heap_page_prune(Relation relation, Buffer buffer, TransactionId OldestXmin,
bool redirect_move, bool report_stats)
{
int ndeleted = 0;
Page page = BufferGetPage(buffer);
OffsetNumber offnum,
maxoff;
PruneState prstate;
/*
* Our strategy is to scan the page and make lists of items to change,
* then apply the changes within a critical section. This keeps as much
* logic as possible out of the critical section, and also ensures that
* WAL replay will work the same as the normal case.
*
* First, inform inval.c that upcoming CacheInvalidateHeapTuple calls are
* nontransactional.
*/
if (redirect_move)
BeginNonTransactionalInvalidation();
/*
* Initialize the new pd_prune_xid value to zero (indicating no prunable
* tuples). If we find any tuples which may soon become prunable, we will
* save the lowest relevant XID in new_prune_xid. Also initialize the rest
* of our working state.
*/
prstate.new_prune_xid = InvalidTransactionId;
prstate.nredirected = prstate.ndead = prstate.nunused = 0;
memset(prstate.marked, 0, sizeof(prstate.marked));
/* Scan the page */
maxoff = PageGetMaxOffsetNumber(page);
for (offnum = FirstOffsetNumber;
offnum <= maxoff;
offnum = OffsetNumberNext(offnum))
{
ItemId itemid;
/* Ignore items already processed as part of an earlier chain */
if (prstate.marked[offnum])
continue;
/* Nothing to do if slot is empty or already dead */
itemid = PageGetItemId(page, offnum);
if (!ItemIdIsUsed(itemid) || ItemIdIsDead(itemid))
continue;
/* Process this item or chain of items */
ndeleted += heap_prune_chain(relation, buffer, offnum,
OldestXmin,
&prstate,
redirect_move);
}
/*
* Send invalidation messages for any tuples we are about to move. It is
* safe to do this now, even though we could theoretically still fail
* before making the actual page update, because a useless cache
* invalidation doesn't hurt anything. Also, no one else can reload the
* tuples while we have exclusive buffer lock, so it's not too early to
* send the invals. This avoids sending the invals while inside the
* critical section, which is a good thing for robustness.
*/
if (redirect_move)
EndNonTransactionalInvalidation();
/* Any error while applying the changes is critical */
START_CRIT_SECTION();
/* Have we found any prunable items? */
if (prstate.nredirected > 0 || prstate.ndead > 0 || prstate.nunused > 0)
{
/*
* Apply the planned item changes, then repair page fragmentation, and
* update the page's hint bit about whether it has free line pointers.
*/
heap_page_prune_execute(buffer,
prstate.redirected, prstate.nredirected,
prstate.nowdead, prstate.ndead,
prstate.nowunused, prstate.nunused,
redirect_move);
/*
* Update the page's pd_prune_xid field to either zero, or the lowest
* XID of any soon-prunable tuple.
*/
((PageHeader) page)->pd_prune_xid = prstate.new_prune_xid;
/*
* Also clear the "page is full" flag, since there's no point in
* repeating the prune/defrag process until something else happens to
* the page.
*/
PageClearFull(page);
MarkBufferDirty(buffer);
/*
* Emit a WAL HEAP_CLEAN or HEAP_CLEAN_MOVE record showing what we did
*/
if (!relation->rd_istemp)
{
XLogRecPtr recptr;
recptr = log_heap_clean(relation, buffer,
prstate.redirected, prstate.nredirected,
prstate.nowdead, prstate.ndead,
prstate.nowunused, prstate.nunused,
redirect_move);
PageSetLSN(BufferGetPage(buffer), recptr);
}
}
else
{
/*
* If we didn't prune anything, but have found a new value for the
* pd_prune_xid field, update it and mark the buffer dirty. This is
* treated as a non-WAL-logged hint.
*
* Also clear the "page is full" flag if it is set, since there's no
* point in repeating the prune/defrag process until something else
* happens to the page.
*/
if (((PageHeader) page)->pd_prune_xid != prstate.new_prune_xid ||
PageIsFull(page))
{
((PageHeader) page)->pd_prune_xid = prstate.new_prune_xid;
PageClearFull(page);
MarkBufferDirtyHint(buffer, relation);
}
}
END_CRIT_SECTION();
/*
* If requested, report the number of tuples reclaimed to pgstats. This is
* ndeleted minus ndead, because we don't want to count a now-DEAD root
* item as a deletion for this purpose.
*/
if (report_stats && ndeleted > prstate.ndead)
pgstat_update_heap_dead_tuples(relation, ndeleted - prstate.ndead);
/*
* XXX Should we update the FSM information of this page ?
*
* There are two schools of thought here. We may not want to update FSM
* information so that the page is not used for unrelated UPDATEs/INSERTs
* and any free space in this page will remain available for further
* UPDATEs in *this* page, thus improving chances for doing HOT updates.
*
* But for a large table and where a page does not receive further UPDATEs
* for a long time, we might waste this space by not updating the FSM
* information. The relation may get extended and fragmented further.
*
* One possibility is to leave "fillfactor" worth of space in this page
* and update FSM with the remaining space.
*
* In any case, the current FSM implementation doesn't accept
* one-page-at-a-time updates, so this is all academic for now.
*/
return ndeleted;
}
