Un-double the backslashes in the LIKE patterns, since
standard_conforming_strings is now the default.  Just to be sure, include
a command to set standard_conforming_strings to ON in the example.

Back-patch to 9.1, where standard_conforming_strings became the default.

Josh Kupershmidt, reviewed by Jeff Janes

Complaint and patch from Zoltán Böszörményi.

When cross-compiling, the native make doesn't know
about the Windows .exe suffix, so it only builds with
it when explicitly told to do so.

The native make will not see the link between the target
name and the built executable, and might this do unnecesary
work, but that's a bigger problem than this one, if in fact
we consider it a problem at all.

Back-patch to all live branches.

The old text claimed that INSERT and UPDATE always return
PGRES_COMMAND_OK, but INSERT/UPDATE with RETURNING return
PGRES_TUPLES_OK.

Josh Kupershmidt

Use of SnapshotNow is known to expose us to race conditions if the tuple(s)
being sought could be updated by concurrently-committing transactions.
CREATE DATABASE and DROP DATABASE are particularly exposed because they do
heavyweight filesystem operations during their scans of pg_tablespace,
so that the scans run for a very long time compared to most.  Furthermore,
the potential consequences of a missed or twice-visited row are nastier
than average:

* createdb() could fail with a bogus "file already exists" error, or
  silently fail to copy one or more tablespace's worth of files into the
  new database.

* remove_dbtablespaces() could miss one or more tablespaces, thus failing
  to free filesystem space for the dropped database.

* check_db_file_conflict() could likewise miss a tablespace, leading to an
  OID conflict that could result in data loss either immediately or in
  future operations.  (This seems of very low probability, though, since a
  duplicate database OID would be unlikely to start with.)

Hence, it seems worth fixing these three places to use MVCC snapshots, even
though this will someday be superseded by a generic solution to SnapshotNow
race conditions.

Back-patch to all active branches.

Stephen Frost and Tom Lane

This got broken in the original fast-path locking patch, because
I failed to account for the fact that Hot Standby startup process
might take a strong relation lock on a relation in a database to
which it is not bound, and confused MyDatabaseId with the database
ID of the relation being locked.

Report and diagnosis by Andres Freund.  Final form of patch by me.

If the cluster alignments don't match, output this suggestion:

	Likely one cluster is a 32-bit install, the other 64-bit

Bug reported by Michael Paquier

Author: Andres Freund

Remove extra line at bottom of table for new 'latex' mode border=3.
Also update 'latex'-longtable 'tableattr' docs to say
'whitespace-separated' instead of 'space'.

of timeline, take advantage of that in walreceiver.

Startup process is still in control of choosign the target timeline, by
scanning the timeline history files present in pg_xlog, but walreceiver now
uses the next timeline's ID to fetch its history file immediately after it
has finished streaming the old timeline. Before, the standby would first try
to restart streaming on the old timeline, which fetches the missing timeline
history file as a side-effect, and only then restart from the new timeline.
This patch eliminates the extra iteration, which speeds up the timeline
switch and reduces the noise in the log caused by the extra restart on the
old timeline.

The xlogreader refactoring broke the logic to decide which timeline to start
streaming from. XLogPageRead() uses the timeline history to check which
timeline the requested WAL position falls into. However, after the
refactoring, XLogPageRead() is always first called with the first page in
the segment, to verify the segment header, and only then with the actual WAL
position we're interested in. That first read of the segment's header made
XLogPageRead() to always start streaming from the old timeline containing
the segment header, not the timeline containing the actual record, if there
was a timeline switch within the segment.

I thought I fixed this yesterday, but that fix was too narrow and only fixed
this for the corner-case that the timeline switch happened in the first page
of the segment. To fix this more robustly, pass explicitly the position of
the record we're actually interested in to XLogPageRead, and use that to
decide which timeline to read from, rather than deduce it from the page and
offset.

Per report from Fujii Masao.

get a large enough part of the page to include the beginning of the next
record we're interested in. The XLogPageRead callback uses the requested
length to decide which timeline to stream WAL from, and if the first call
is short, and the page contains a timeline switch, we'll repeatedly try
to stream that page from the old timeline, and never get across the
timeline switch.

The patch to allow pg_receivexlog to switch timeline added a result set
after copy has ended in START_STREAMING command, to return the next
timeline's ID to the client. But walreceived didn't get the memo, and threw
an error on the unexpected result set. Fix.

When relations are dropped, at end of transaction we need to remove the
files and clean the buffer pool of buffers containing pages of those
relations.  Previously we would scan the buffer pool once per relation
to clean up buffers.  When there are many relations to drop, the
repeated scans make this process slow; so we now instead pass a list of
relations to drop and scan the pool once, checking each buffer against
the passed list.  When the number of relations is larger than a
threshold (which as of this patch is being set to 20 relations) we sort
the array before starting, and bsearch the array; when it's smaller, we
simply scan the array linearly each time, because that's faster.  The
exact optimal threshold value depends on many factors, but the
difference is not likely to be significant enough to justify making it
user-settable.

This has been measured to be a significant win (a 15x win when dropping
100,000 relations; an extreme case, but reportedly a real one).

Author: Tomas Vondra, some tweaks by me
Reviewed by: Robert Haas, Shigeru Hanada, Andres Freund, Álvaro Herrera

This mirrors the changes done earlier to the server in standby mode. When
receivelog reaches the end of a timeline, as reported by the server, it
fetches the timeline history file of the next timeline, and restarts
streaming from the new timeline by issuing a new START_STREAMING command.

When pg_receivexlog crosses a timeline, it leaves the .partial suffix on the
last segment on the old timeline. This helps you to tell apart a partial
segment left in the directory because of a timeline switch, and a completed
segment. If you just follow a single server, it won't make a difference, but
it can be significant in more complicated scenarios where new WAL is still
generated on the old timeline.

This includes two small changes to the streaming replication protocol:
First, when you reach the end of timeline while streaming, the server now
sends the TLI of the next timeline in the server's history to the client.
pg_receivexlog uses that as the next timeline, so that it doesn't need to
parse the timeline history file like a standby server does. Second, when
BASE_BACKUP command sends the begin and end WAL positions, it now also sends
the timeline IDs corresponding the positions.

The code originally just doubled the size of the tuple-pointer array so
long as that would fit in allowedMem.  This could result in failing to use
as much as half of allowedMem, if (as is typical) the last doubling attempt
didn't quite fit.  Worse, we might double the array size but be unable to
use most of the added slots, because there was no room left within the
allowedMem limit for tuples the slots should point to.  To fix, double only
so long as we've used less than half of allowedMem in total.  Then do one
more array enlargement, but scale it based on total memory consumption so
far.  This will work nicely as long as the average tuple size is reasonably
stable, and in any case should be better than the old method.

This change will result in large sort operations consuming a larger
fraction of work_mem than they typically did in the past.  The release
notes should mention that users may want to revisit their work_mem
settings, if they'd tuned those settings based on the old behavior of
sorting.

Jeff Janes, reviewed by Peter Geoghegan and Robert Haas

XLogReadRecord should reset its state on every error, to make sure it
re-reads the page on next call. It was inconsistent in that some errors did
that, but some did not.

In ReadRecord(), don't give up on an error if we're in standby mode. The
loop was set up to retry, but the checks within the loop broke out of the
loop on any error.

Andres Freund, with some tweaking by me.

latex longtable is more powerful than the 'tabular' output format
'latex' uses.  Also add border=3 support to 'latex'.

The patch that turned XLogRecPtr into a uint64 inadvertently changed the
on-disk format of GiST indexes, because the NSN field in the GiST page
opaque is an XLogRecPtr. That breaks pg_upgrade. Revert the format of that
field back to the two-field struct that XLogRecPtr was before. This is the
same we did to LSNs in the page header to avoid changing on-disk format.

Bump catversion, as this invalidates any existing GiST indexes built on
9.3devel.

It's better to start from what the OpenSSL people consider a good
default and then remove insecure things (low encryption, exportable
encryption and md5 at this point) from that, instead of starting
from everything that exists and remove from that. We trust the
OpenSSL people to make good choices about what the default is.

This way the line doesn't shift right as the amount of data processed
increases.

When truncating at the end, like before, the output would often end up
just showing the path instead of the filename.

Also increase the length of the filename by 5, which still keeps us at
less than 80 characters in most outputs.

On top of the previous support in pg_dump, add support to specify
multiple tables (by using the -t option multiple times) to
pg_restore, clsuterdb, reindexdb and vacuumdb.

Josh Kupershmidt, reviewed by Karl O. Pinc

It was largely full of outdated and incorrect information.  Move the few
notes which were still relevant into header comments of pg_backup_tar.c
and pg_dumpall.c.

Josh Kupershmidt

This new facility can not only be used by xlog.c to carry out crash
recovery, but also by external programs.  By supplying a function to
read XLog pages from somewhere, all the WAL reading can be used for
completely different purposes.

For the standard backend use, the behavior should be pretty much the
same as previously.  As for non-backend programs, an hypothetical
pg_xlogdump program is now closer to reality, but some more backend
support is still necessary.

This patch was originally submitted by Andres Freund in a different
form, but Heikki Linnakangas opted for and authored another design of
the concept.  Andres has advanced the patch since Heikki's initial
version.  Review and some (mostly cosmetics) changes by me.

On second thought, "none" could mislead to think that you're connected a
database with that name. Duplicate the whole string, so that it can be
more easily translated. In back-branches, thought, just use an empty string
in place of the database name, to avoid adding a translatable string.

Backpatch all the way to 8.3. Fixes bug #7811, per report and diagnosis by
Meng Qingzhong.

When attempting to move an object into the schema in which it already
was, for most objects classes we were correctly complaining about
exactly that ("object is already in schema"); but for some other object
classes, such as functions, we were instead complaining of a name
collision ("object already exists in schema").  The latter is wrong and
misleading, per complaint from Robert Haas in
CA+TgmoZ0+gNf7RDKRc3u5rHXffP=QjqPZKGxb4BsPz65k7qnHQ@mail.gmail.com

To fix, refactor the way these checks are done.  As a bonus, the
resulting code is smaller and can also share some code with Rename
cases.

While at it, remove use of getObjectDescriptionOids() in error messages.
These are normally disallowed because of translatability considerations,
but this one had slipped through since 9.1.  (Not sure that this is
worth backpatching, though, as it would create some untranslated
messages in back branches.)

This is loosely based on a patch by KaiGai Kohei, heavily reworked by
me.

The WAL streaming message format changed in 9.3, so 9.3 pg_basebackup or
pg_receivelog won't work against older servers.

Original coding would corrupt the hashtable if the item being updated was
at the end of its bucket chain and the new hash key hashed to that same
bucket.  Diagnosis and fix by Heikki Linnakangas.

Because the return value of lseek() was assigned to an unsigned size_t
variable, we'd fail to notice an error return code -1. Compiler gave a
warning about this.

Andres Freund

This was legal back in the days of add_missing_from, though perhaps
never good style.  It's not legal anymore ...

Jan Urbański

Dates outside the supported range could be entered, but would not print
reasonably, and operations such as conversion to timestamp wouldn't behave
sanely either.  Since this has the potential to result in undumpable table
data, it seems worth back-patching.

Hitoshi Harada

This seems to have been invented in 2011 to represent GMT+3, non daylight
savings rules, as now used in Europe/Kaliningrad and Europe/Minsk.
There are no conflicts so might as well add it to the Default list.
Per bug #7804 from Ruslan Izmaylov.

Andres Freund

The code in PostPrepare_Locks supposed that it could reassign locks to
the prepared transaction's dummy PGPROC by deleting the PROCLOCK table
entries and immediately creating new ones.  This was safe when that code
was written, but since we invented partitioning of the shared lock table,
it's not safe --- another process could steal away the PROCLOCK entry in
the short interval when it's on the freelist.  Then, if we were otherwise
out of shared memory, PostPrepare_Locks would have to PANIC, since it's
too late to back out of the PREPARE at that point.

Fix by inventing a dynahash.c function to atomically update a hashtable
entry's key.  (This might possibly have other uses in future.)

This is an ancient bug that in principle we ought to back-patch, but the
odds of someone hitting it in the field seem really tiny, because (a) the
risk window is small, and (b) nobody runs servers with maxed-out lock
tables for long, because they'll be getting non-PANIC out-of-memory errors
anyway.  So fixing it in HEAD seems sufficient, at least until the new
code has gotten some testing.

Forgot I was going to do this as part of the previous patch ...

In commit 71450d7f, we added code to inform
suitably-intelligent compilers that ereport() doesn't return if the elevel
is ERROR or higher.  This patch extends that to elog(), and also fixes a
double-evaluation hazard that the previous commit created in ereport(),
as well as reducing the emitted code size.

The elog() improvement requires the compiler to support __VA_ARGS__, which
should be available in just about anything nowadays since it's required by
C99.  But our minimum language baseline is still C89, so add a configure
test for that.

The previous commit assumed that ereport's elevel could be evaluated twice,
which isn't terribly safe --- there are already counterexamples in xlog.c.
On compilers that have __builtin_constant_p, we can use that to protect the
second test, since there's no possible optimization gain if the compiler
doesn't know the value of elevel.  Otherwise, use a local variable inside
the macros to prevent double evaluation.  The local-variable solution is
inferior because (a) it leads to useless code being emitted when elevel
isn't constant, and (b) it increases the optimization level needed for the
compiler to recognize that subsequent code is unreachable.  But it seems
better than not teaching non-gcc compilers about unreachability at all.

Lastly, if the compiler has __builtin_unreachable(), we can use that
instead of abort(), resulting in a noticeable code savings since no
function call is actually emitted.  However, it seems wise to do this only
in non-assert builds.  In an assert build, continue to use abort(), so that
the behavior will be predictable and debuggable if the "impossible"
happens.

These changes involve making the ereport and elog macros emit do-while
statement blocks not just expressions, which forces small changes in
a few call sites.

Andres Freund, Tom Lane, Heikki Linnakangas