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Commit fe0a0b59, which moved code to do MD5 authentication to a separate
CheckMD5Auth() function, left behind a comment that really belongs inside
the function, too. Also move the check for db_user_namespace inside the
function, seems clearer that way.
Now that the md5 salt is passed as argument to md5_crypt_verify, it's a bit
silly that it peeks into the Port struct to see if MD5 authentication was
used. Seems more straightforward to treat it as an MD5 authentication, if
the md5 salt argument is given. And after that, md5_crypt_verify only used
the Port argument to look at port->user_name, but that is redundant,
because it is also passed as a separate 'role' argument. So remove the Port
argument altogether.
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We allegedly allocated all remaining memory for the read buffers of the
sort tapes, but we allocated the merge heap only after that. That means
that the allocation of the merge heap was guaranteed to go over the memory
limit. Fix by allocating the merge heap first. This makes little difference
in practice, because the merge heap is tiny, but let's tidy.
While we're at it, add a safeguard for the case that we are already over
the limit when allocating the read buffers. That shouldn't happen, but
better safe than sorry.
The memory accounting error was reported off-list by Peter Geoghegan.
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Another attmempt to fix the tests which were added by commit
f0e44751d7175fa3394da2c8f85e3ceb3cdbfe63.
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Commit f0e44751d7175fa3394da2c8f85e3ceb3cdbfe63 is turning the
buildfarm red; let's try something hopefully more portable.
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Table partitioning is like table inheritance and reuses much of the
existing infrastructure, but there are some important differences.
The parent is called a partitioned table and is always empty; it may
not have indexes or non-inherited constraints, since those make no
sense for a relation with no data of its own. The children are called
partitions and contain all of the actual data. Each partition has an
implicit partitioning constraint. Multiple inheritance is not
allowed, and partitioning and inheritance can't be mixed. Partitions
can't have extra columns and may not allow nulls unless the parent
does. Tuples inserted into the parent are automatically routed to the
correct partition, so tuple-routing ON INSERT triggers are not needed.
Tuple routing isn't yet supported for partitions which are foreign
tables, and it doesn't handle updates that cross partition boundaries.
Currently, tables can be range-partitioned or list-partitioned. List
partitioning is limited to a single column, but range partitioning can
involve multiple columns. A partitioning "column" can be an
expression.
Because table partitioning is less general than table inheritance, it
is hoped that it will be easier to reason about properties of
partitions, and therefore that this will serve as a better foundation
for a variety of possible optimizations, including query planner
optimizations. The tuple routing based which this patch does based on
the implicit partitioning constraints is an example of this, but it
seems likely that many other useful optimizations are also possible.
Amit Langote, reviewed and tested by Robert Haas, Ashutosh Bapat,
Amit Kapila, Rajkumar Raghuwanshi, Corey Huinker, Jaime Casanova,
Rushabh Lathia, Erik Rijkers, among others. Minor revisions by me.
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Ancient oversight in PageOutput(): if popen() fails, we'd better reset
the SIGPIPE handler before returning stdout, because ClosePager() won't.
Noticed while fixing the empty-PAGER issue.
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If the PAGER environment variable is set but contains an empty string,
psql would pass it to "sh" which would silently exit, causing whatever
query output we were printing to vanish entirely. This is quite
mystifying; it took a long time for us to figure out that this was the
cause of Joseph Brenner's trouble report. Rather than allowing that
to happen, we should treat this as another way to specify "no pager".
(We could alternatively treat it as selecting the default pager, but
it seems more likely that the former is what the user meant to achieve
by setting PAGER this way.)
Nonempty, but all-white-space, PAGER values have the same behavior, and
it's pretty easy to test for that, so let's handle that case the same way.
Most other cases of faulty PAGER values will result in the shell printing
some kind of complaint to stderr, which should be enough to diagnose the
problem, so we don't need to work harder than this. (Note that there's
been an intentional decision not to be very chatty about apparent failure
returns from the pager process, since that may happen if, eg, the user
quits the pager with control-C or some such. I'd just as soon not start
splitting hairs about which exit codes might merit making our own report.)
libpq's old PQprint() function was already on board with ignoring empty
PAGER values, but for consistency, make it ignore all-white-space values
as well.
It's been like this a long time, so back-patch to all supported branches.
Discussion: https://postgr.es/m/CAFfgvXWLOE2novHzYjmQK8-J6TmHz42G8f3X0SORM44+stUGmw@mail.gmail.com
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In commit fe0a0b59, the datatype used for MyCancelKey and other variables
that store cancel keys were changed from long to uint32, but I missed this
one. That broke query cancellation on platforms where long is wider than 32
bits.
Report by Andres Freund, fix by Michael Paquier.
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Thomas Munro
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Rearrange a bit of code to ensure that 'mode' in LWLockRelease is
obviously always set, which seems a bit cleaner and avoids a compiler
warning (thanks to Robert for the suggestion!).
In GetCachedPlan(), initialize 'plan' to silence a compiler warning, but
also add an Assert() to make sure we don't ever actually fall through
with 'plan' still being set to NULL, since we are about to dereference
it.
Neither of these appear to be live bugs but at least gcc
5.4.0-6ubuntu1~16.04.4 doesn't quite have the smarts to realize that.
Discussion: https://www.postgresql.org/message-id/20161129152102.GR13284%40tamriel.snowman.net
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It typically is a "long", but it seems possible that on some platforms
it wouldn't be. In any case, this silences a compiler warning on
OpenBSD (cf buildfarm member curculio).
While at it, use snprintf not sprintf. This format string couldn't
possibly overrun the supplied buffer, but that doesn't seem like
a good reason not to use the safer style.
Oversight in commit f828654e1. Back-patch to 9.6 where that came in.
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Previously, a prepared statement created via a Parse message could get
a parallel plan, but one created with a PREPARE statement could not.
This state of affairs was due to confusion on my (rhaas) part: I
erroneously believed that a CREATE TABLE .. AS EXECUTE statement could
only be performed with a prepared statement by PREPARE, but in fact
one created by a Prepare message works just as well. Therefore, it
makes no sense to allow parallel query in one case but not the other.
To fix, allow parallel query with all prepared statements, but run
the parallel plan serially (i.e. without workers) in the case of
CREATE TABLE .. AS EXECUTE. Also, document this.
Amit Kapila and Tobias Bussman, plus an extra sentence of
documentation by me.
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Mea culpa.
Pointed out by Andres.
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If we're going to write a semicolon after calls of relptr_declare(),
then we don't need one inside the macro, and removing it suppresses
"empty declaration" warnings from pickier compilers (eg pademelon).
While at it, we might as well use relptr() inside relptr_declare(),
because otherwise that macro would likely go unused altogether.
Also improve the comment, which I for one found unclear,
and provide a specific example of intended usage.
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The previously code worked OK as long as a Gather node was never
rescanned, or if it was rescanned, as long as it got at least as
many workers on rescan as it had originally. But if the number
of workers ever decreased on a rescan, then it could crash.
Andreas Seltenreich
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We have had support for restrictive RLS policies since 9.5, but they
were only available through extensions which use the appropriate hooks.
This adds support into the grammer, catalog, psql and pg_dump for
restrictive RLS policies, thus reducing the cases where an extension is
necessary.
In passing, also move away from using "AND"d and "OR"d in comments.
As pointed out by Alvaro, it's not really appropriate to attempt
to make verbs out of "AND" and "OR", so reword those comments which
attempted to.
Reviewed By: Jeevan Chalke, Dean Rasheed
Discussion: https://postgr.es/m/20160901063404.GY4028@tamriel.snowman.net
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Per buildfarm member gaur and Tom Lane.
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If we failed to connect to one or more hosts, and then afterwards we
find one that fails to be read-write, the latter error message was
clobbering any earlier ones. Repair.
Mithun Cy, slightly revised by me.
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It's possible for the metapage contents to change after we release
the lock, so we must read them before releasing the lock.
Amit Kapila. Submitted in response to a trouble report from
Andreas Seltenreich, though it is not certain this fixes the
problem.
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Commit b460f5d6693103076dc554aa7cbb96e1e53074f9 -- at my suggestion --
increased the default value of max_worker_processes from 8 to 16, on
the theory that this would be harmless and convenient for users.
Unfortunately, this caused some buildfarm machines with low connection
limits to start failing, so apparently it's not harmless after all.
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On 32-bit systems, don't try to use 64-bit DSA pointers, because the
computation of DSA_MAX_SEGMENT_SIZE overflows Size.
Cast 1 to Size before shifting it, so that the compiler doesn't
produce a result of the wrong width.
In passing, change one use of size_t to Size.
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Commit 13df76a537cca3b8884911d8fdf7c89a457a8dd3 was overconfident
about how portable %016lx is. Some compilers complain because they
need %016llx, while platforms where DSA pointers are only 32 bits
get unhappy about using a 64-bit format for a 32-bit quantity.
Thomas Munro, per an off-list suggestion from me.
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This adds a new routine, pg_strong_random() for generating random bytes,
for use in both frontend and backend. At the moment, it's only used in
the backend, but the upcoming SCRAM authentication patches need strong
random numbers in libpq as well.
pg_strong_random() is based on, and replaces, the existing implementation
in pgcrypto. It can acquire strong random numbers from a number of sources,
depending on what's available:
- OpenSSL RAND_bytes(), if built with OpenSSL
- On Windows, the native cryptographic functions are used
- /dev/urandom
Unlike the current pgcrypto function, the source is chosen by configure.
That makes it easier to test different implementations, and ensures that
we don't accidentally fall back to a less secure implementation, if the
primary source fails. All of those methods are quite reliable, it would be
pretty surprising for them to fail, so we'd rather find out by failing
hard.
If no strong random source is available, we fall back to using erand48(),
seeded from current timestamp, like PostmasterRandom() was. That isn't
cryptographically secure, but allows us to still work on platforms that
don't have any of the above stronger sources. Because it's not very secure,
the built-in implementation is only used if explicitly requested with
--disable-strong-random.
This replaces the more complicated Fortuna algorithm we used to have in
pgcrypto, which is unfortunate, but all modern platforms have /dev/urandom,
so it doesn't seem worth the maintenance effort to keep that. pgcrypto
functions that require strong random numbers will be disabled with
--disable-strong-random.
Original patch by Magnus Hagander, tons of further work by Michael Paquier
and me.
Discussion: https://www.postgresql.org/message-id/CAB7nPqRy3krN8quR9XujMVVHYtXJ0_60nqgVc6oUk8ygyVkZsA@mail.gmail.com
Discussion: https://www.postgresql.org/message-id/CAB7nPqRWkNYRRPJA7-cF+LfroYV10pvjdz6GNvxk-Eee9FypKA@mail.gmail.com
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Previously gin_desc() displayed incorrect output "unknown action 0"
for XLOG_GIN_INSERT and XLOG_GIN_VACUUM_DATA_LEAF_PAGE records with
valid actions. The cause of this problem was that gin_desc() wrongly
used XLogRecGetData() to extract data from those records.
Since they were registered by XLogRegisterBufData(), gin_desc() should
have used XLogRecGetBlockData(), instead, like gin_redo().
Also there were other differences about how to treat XLOG_GIN_INSERT
record between gin_desc() and gin_redo().
This commit fixes gin_desc() routine so that it treats those records
in the same way as gin_redo().
Batch-patch to 9.5 where WAL record format was revamped and
XLogRegisterBufData() was added.
Reported-By: Andres Freund
Reviewed-By: Tom Lane
Discussion: <20160509194645.7lewnpw647zegx2m@alap3.anarazel.de>
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transformOnConflictClause incremented p_next_resno while generating the
phony targetlist for the EXCLUDED pseudo-rel. Then that field got
incremented some more during transformTargetList, possibly leading to
free_parsestate concluding that we'd overrun the allowed length of a tlist,
as reported by Justin Pryzby.
We could fix this by resetting p_next_resno to 1 after using it for the
EXCLUDED pseudo-rel tlist, but it seems easier and less coupled to other
places if we just don't use that field at all in this loop. (Note that
this doesn't change anything about the resnos that end up appearing in
the main target list, because those are all replaced with target-column
numbers by updateTargetListEntry.)
In passing, fix incorrect type OID assigned to the whole-row Var for
"EXCLUDED.*" (somehow this escaped having any bad consequences so far,
but it's certainly wrong); remove useless assignment to var->location;
pstrdup the column names in case of a relcache flush; and improve
nearby comments.
Back-patch to 9.5 where ON CONFLICT was introduced.
Report: https://postgr.es/m/20161204163237.GA8030@telsasoft.com
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Craig Ringer, reviewed by Kyotaro HORIGUCHI and Michael Paquier.
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This extends to MinGW builds the provision for MSVC-built libraries to
see putenv() effects. Doing so repairs, for example, the handling of
the krb_server_keyfile parameter when linked with MSVC-built MIT
Kerberos. Like the previous commit, no back-patch.
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Until now, the first putenv() call of a given postgres.exe process would
cache the set of loaded CRTs. If a CRT unloaded after that call, the
next putenv() would crash. That risk was largely theoretical, because
the first putenv() precedes all PostgreSQL-initiated module loading.
However, this might explain bad interactions with antivirus and other
software that injects threads asynchronously. If an additional CRT
loaded after the first putenv(), pgwin32_putenv() would not discover it.
That CRT would have all environment changes predating its load, but it
would not receive later PostgreSQL-initiated changes. An additional CRT
loading concurrently with the first putenv() might miss that change in
addition to missing later changes. Fix all those problems. This
removes the cache mechanism from pgwin32_putenv(); the cost, less than
100 μs per backend startup, is negligible.
No resulting misbehavior was known to be user-visible given the core
distribution alone, but one can readily construct an affected extension
module. No back-patch given the lack of complaints and the potential
for behavior changes in non-PostgreSQL code running in the backend.
Christian Ullrich, reviewed by Michael Paquier.
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This has no effect in the most conventional case, where no relevant DLL
uses a debug build. For an example where it does matter, given a debug
build of MIT Kerberos, the krb_server_keyfile parameter usually had no
effect. Since nobody wants a Heisenbug, back-patch to 9.2 (all
supported versions).
Christian Ullrich, reviewed by Michael Paquier.
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In accordance with its own documentation, invoke CloseHandle() only when
directed in the documentation for the function that furnished the
handle. GetModuleHandle() does not so direct. We have been issuing
this call only in the rare event that a CRT DLL contains no "_putenv"
symbol, so lack of bug reports is uninformative. Back-patch to 9.2 (all
supported versions).
Christian Ullrich, reviewed by Michael Paquier.
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Replace use of plain 0 as a null pointer constant. In comments, update
terminology and lessen redundancy. Back-patch to 9.2 (all supported
versions) for the convenience of back-patching the next two commits.
Christian Ullrich and Noah Misch, reviewed (in earlier versions) by
Michael Paquier.
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Must do pg_stat_clear_snapshot() inside test's loop, or our snapshot of
pg_stat_activity will never change :-(. Thinko in b3427dade -- evidently
my workstation never really iterated the loop in testing. Per buildfarm.
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deleteWhatDependsOn() had grown an uncomfortably large number of
assumptions about what it's used for. There are actually only two minor
differences between what it does and what a regular performDeletion() call
can do, so let's invent additional bits in performDeletion's existing flags
argument that specify those behaviors, and get rid of deleteWhatDependsOn()
as such. (We'd probably have done it this way from the start, except that
performDeletion didn't originally have a flags argument, IIRC.)
Also, add a SKIP_EXTENSIONS flag bit that prevents ever recursing to an
extension, and use that when dropping temporary objects at session end.
This provides a more general solution to the problem addressed in a hacky
way in commit 08dd23cec: if an extension script creates temp objects and
forgets to remove them again, the whole extension went away when its
contained temp objects were deleted. The previous solution only covered
temp relations, but this solves it for all object types.
These changes require minor additions in dependency.c to pass the flags
to subroutines that previously didn't get them, but it's still a net
savings of code, and it seems cleaner than before.
Having done this, revert the special-case code added in 08dd23cec that
prevented addition of pg_depend records for temp table extension
membership, because that caused its own oddities: dropping an extension
that had created such a table didn't automatically remove the table,
leading to a failure if the table had another dependency on the extension
(such as use of an extension data type), or to a duplicate-name failure if
you then tried to recreate the extension. But we keep the part that
prevents the pg_temp_nnn schema from becoming an extension member; we never
want that to happen. Add a regression test case covering these behaviors.
Although this fixes some arguable bugs, we've heard few field complaints,
and any such problems are easily worked around by explicitly dropping temp
objects at the end of extension scripts (which seems like good practice
anyway). So I won't risk a back-patch.
Discussion: https://postgr.es/m/e51f4311-f483-4dd0-1ccc-abec3c405110@BlueTreble.com
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Programmers discovered decades ago that it was useful to have a simple
interface for allocating and freeing memory, which is why malloc() and
free() were invented. Unfortunately, those handy tools don't work
with dynamic shared memory segments because those are specific to
PostgreSQL and are not necessarily mapped at the same address in every
cooperating process. So invent our own allocator instead. This makes
it possible for processes cooperating as part of parallel query
execution to allocate and free chunks of memory without having to
reserve them prior to the start of execution. It could also be used
for longer lived objects; for example, we could consider storing data
for pg_stat_statements or the stats collector in shared memory using
these interfaces, rather than writing them to files. Basically,
anything that needs shared memory but can't predict in advance how
much it's going to need might find this useful.
Thomas Munro and Robert Haas. The original code (of mine) on which
Thomas based his work was actually designed to be a new backend-local
memory allocator for PostgreSQL, but that hasn't gone anywhere - or
not yet, anyway. Thomas took that work and performed major
refactoring and extensive modifications to make it work with dynamic
shared memory, including the addition of appropriate locking.
Discussion: CA+TgmobkeWptGwiNa+SGFWsTLzTzD-CeLz0KcE-y6LFgoUus4A@mail.gmail.com
Discussion: CAEepm=1z5WLuNoJ80PaCvz6EtG9dN0j-KuHcHtU6QEfcPP5-qA@mail.gmail.com
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This is intended as infrastructure for a full-fledged allocator for
dynamic shared memory. The interface looks a bit like a real
allocator, but only supports allocating and freeing memory in
multiples of the 4kB page size. Further, to free memory, you must
know the size of the span you wish to free, in pages. While these are
make it unsuitable as an allocator in and of itself, it still serves
as very useful scaffolding for a full-fledged allocator.
Robert Haas and Thomas Munro. This code is mostly the same as my 2014
submission, but Thomas fixed quite a few bugs and made some changes to
the interface.
Discussion: CA+TgmobkeWptGwiNa+SGFWsTLzTzD-CeLz0KcE-y6LFgoUus4A@mail.gmail.com
Discussion: CAEepm=1z5WLuNoJ80PaCvz6EtG9dN0j-KuHcHtU6QEfcPP5-qA@mail.gmail.com
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C doesn't have any sort of built-in understanding of a pointer
relative to some arbitrary base address, but dynamic shared memory
segments can be mapped at different addresses in different processes,
so any sort of shared data structure stored within a dynamic shared
memory segment can't use absolute pointers. We could use something
like Size to represent a relative pointer, but then the compiler
provides no type-checking. Use stupid macro tricks to get some
type-checking.
Patch originally by me. Concept suggested by Andres Freund. Recently
resubmitted as part of Thomas Munro's work on dynamic shared memory
allocation.
Discussion: 20131205144434.GG12398@alap2.anarazel.de
Discussion: CAEepm=1z5WLuNoJ80PaCvz6EtG9dN0j-KuHcHtU6QEfcPP5-qA@mail.gmail.com
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Commit 597a87ccc9a6f neglected to update some comments; fix.
Report and patch by Thomas Munro.
Reviewed by Petr Jelínek.
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Increase the default value of the existing max_worker_processes GUC
from 8 to 16, and add a new max_parallel_workers GUC with a maximum
of 8. This way, even if the maximum amount of parallel query is
happening, there is still room for background workers that do other
things, as originally envisioned when max_worker_processes was added.
Julien Rouhaud, reviewed by Amit Kapila and by revised by me.
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Author: Petr Jelínek
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Our documentation states that our maximum field size is 1 GB, and that
our maximum row size of 1.6 TB. However, while this might be attainable
in theory with enough contortions, it is not workable in practice; for
starters, pg_dump fails to dump tables containing rows larger than 1 GB,
even if individual columns are well below the limit; and even if one
does manage to manufacture a dump file containing a row that large, the
server refuses to load it anyway.
This commit enables dumping and reloading of such tuples, provided two
conditions are met:
1. no single column is larger than 1 GB (in output size -- for bytea
this includes the formatting overhead)
2. the whole row is not larger than 2 GB
There are three related changes to enable this:
a. StringInfo's API now has two additional functions that allow creating
a string that grows beyond the typical 1GB limit (and "long" string).
ABI compatibility is maintained. We still limit these strings to 2 GB,
though, for reasons explained below.
b. COPY now uses long StringInfos, so that pg_dump doesn't choke
trying to emit rows longer than 1GB.
c. heap_form_tuple now uses the MCXT_ALLOW_HUGE flag in its allocation
for the input tuple, which means that large tuples are accepted on
input. Note that at this point we do not apply any further limit to the
input tuple size.
The main reason to limit to 2 GB is that the FE/BE protocol uses 32 bit
length words to describe each row; and because the documentation is
ambiguous on its signedness and libpq does consider it signed, we cannot
use the highest-order bit. Additionally, the StringInfo API uses "int"
(which is 4 bytes wide in most platforms) in many places, so we'd need
to change that API too in order to improve, which has lots of fallout.
Backpatch to 9.5, which is the oldest that has
MemoryContextAllocExtended, a necessary piece of infrastructure. We
could apply to 9.4 with very minimal additional effort, but any further
than that would require backpatching "huge" allocations too.
This is the largest set of changes we could find that can be
back-patched without breaking compatibility with existing systems.
Fixing a bigger set of problems (for example, dumping tuples bigger than
2GB, or dumping fields bigger than 1GB) would require changing the FE/BE
protocol and/or changing the StringInfo API in an ABI-incompatible way,
neither of which would be back-patchable.
Authors: Daniel Vérité, Álvaro Herrera
Reviewed by: Tomas Vondra
Discussion: https://postgr.es/m/20160229183023.GA286012@alvherre.pgsql
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The whole walreceiver API is now wrapped into a struct, like most of our
other loadable module APIs. The libpq connection is no longer a global
variable in libpqwalreceiver. Instead, it is encapsulated into a struct
that is passed around the functions. This allows multiple walreceivers
to run at the same time.
Add some rudimentary support for logical replication connections to
libpqwalreceiver.
These changes are mostly cosmetic and are going to be useful for the
future logical replication patches.
From: Petr Jelinek <petr@2ndquadrant.com>
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Replace use of poll()/select() by WaitLatchOrSocket(), which is more
portable and flexible.
Also change walreceiver to use its procLatch instead of a custom latch.
From: Petr Jelinek <petr@2ndquadrant.com>
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This works like function_with_argtypes, but aggregates allow slightly
different arguments.
Reviewed-by: Alvaro Herrera <alvherre@2ndquadrant.com>
Reviewed-by: Tom Lane <tgl@sss.pgh.pa.us>
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It was apparently added for use by GRANT/REVOKE, but move it closer to
where other function signature related things are kept.
Reviewed-by: Alvaro Herrera <alvherre@2ndquadrant.com>
Reviewed-by: Tom Lane <tgl@sss.pgh.pa.us>
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Instead of sometimes referring to a function signature like func_name
func_args, use the existing function_with_argtypes symbol, which
combines the two.
Reviewed-by: Alvaro Herrera <alvherre@2ndquadrant.com>
Reviewed-by: Tom Lane <tgl@sss.pgh.pa.us>
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Commit 274bb2b3857cc987cfa21d14775cae9b0dababa5 caused PQhost() to
return the value of the hostaddr parameter rather than the relevant
host when the latter parameter was specified. That's wrong. Commit
9a1d0af4ad2cbd419115b453d811c141b80d872b then amplified the damage by
using PQhost() in more places, so that the SSL test suite started
failing.
Report by Andreas Karlsson; patch by me.
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So far the hashtable stored representative tuples in the form of its
input slot, with all columns in the hashtable that are not
needed (i.e. not grouped upon or functionally dependent) set to NULL.
Thats good for saving memory, but it turns out that having tuples full
of NULL isn't free. slot_deform_tuple is faster if there's no NULL
bitmap even if no NULLs are encountered, and skipping over leading NULLs
isn't free.
So compute a separate tuple descriptor that only contains the needed
columns. As columns have already been moved in/out the slot for the
hashtable that does not imply additional per-row overhead.
Author: Andres Freund
Reviewed-By: Heikki Linnakangas
Discussion: https://postgr.es/m/20161103110721.h5i5t5saxfk5eeik@alap3.anarazel.de
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Previously we did a ExecProject() for each individual aggregate
argument. That turned out to be a performance bottleneck in queries with
multiple aggregates.
Doing all the argument computations in one ExecProject() is quite a bit
cheaper because ExecProject's fastpath can do the work at once in a
relatively tight loop, and because it can get all the required columns
with a single slot_getsomeattr and save some other redundant setup
costs.
Author: Andres Freund
Reviewed-By: Heikki Linnakangas
Discussion: https://postgr.es/m/20161103110721.h5i5t5saxfk5eeik@alap3.anarazel.de
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Previously, the right to split a bucket was represented by a
heavyweight lock on the page number of the primary bucket page.
Unfortunately, this meant that every scan needed to take a heavyweight
lock on that bucket also, which was bad for concurrency. Instead, use
a cleanup lock on the primary bucket page to indicate the right to
begin a split, so that scans only need to retain a pin on that page,
which is they would have to acquire anyway, and which is also much
cheaper.
In addition to reducing the locking cost, this also avoids locking out
scans and inserts for the entire lifetime of the split: while the new
bucket is being populated with copies of the appropriate tuples from
the old bucket, scans and inserts can happen in parallel. There are
minor concurrency improvements for vacuum operations as well, though
the situation there is still far from ideal.
This patch also removes the unworldly assumption that a split will
never be interrupted. With the new code, a split is done in a series
of small steps and the system can pick up where it left off if it is
interrupted prior to completion. While this patch does not itself add
write-ahead logging for hash indexes, it is clearly a necessary first
step, since one of the things that could interrupt a split is the
removal of electrical power from the machine performing it.
Amit Kapila. I wrote the original design on which this patch is
based, and did a good bit of work on the comments and README through
multiple rounds of review, but all of the code is Amit's. Also
reviewed by Jesper Pedersen, Jeff Janes, and others.
Discussion: http://postgr.es/m/CAA4eK1LfzcZYxLoXS874Ad0+S-ZM60U9bwcyiUZx9mHZ-KCWhw@mail.gmail.com
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