| Commit message (Collapse) | Author | Age | Files | Lines |
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Changes (==) to use only pointer equality. This is safe because two
threads are the same iff they have the same id.
Changes `compare` to check pointer equality first and fall back on ids
only in case of inequality.
See discussion in #16761.
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Previously we would push stack-carried return values to the new stack on
a stack overflow. While the precise reasoning for this barrier is
unfortunately lost to history, in hindsight I suspect it was prompted by
a missing barrier elsewhere (that has been since fixed).
Moreover, there the redundant barrier is actively harmful: the stack may
contain non-pointer values; blindly pushing these to the mark queue will
result in a crash. This is precisely what happened in the `stack003`
test. However, because of a (now fixed) deficiency in the test this
crash did not trigger on amd64.
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This extends the non-moving collector to allow concurrent collection.
The full design of the collector implemented here is described in detail
in a technical note
B. Gamari. "A Concurrent Garbage Collector For the Glasgow Haskell
Compiler" (2018)
This extension involves the introduction of a capability-local
remembered set, known as the /update remembered set/, which tracks
objects which may no longer be visible to the collector due to mutation.
To maintain this remembered set we introduce a write barrier on
mutations which is enabled while a concurrent mark is underway.
The update remembered set representation is similar to that of the
nonmoving mark queue, being a chunked array of `MarkEntry`s. Each
`Capability` maintains a single accumulator chunk, which it flushed
when it (a) is filled, or (b) when the nonmoving collector enters its
post-mark synchronization phase.
While the write barrier touches a significant amount of code it is
conceptually straightforward: the mutator must ensure that the referee
of any pointer it overwrites is added to the update remembered set.
However, there are a few details:
* In the case of objects with a dirty flag (e.g. `MVar`s) we can
exploit the fact that only the *first* mutation requires a write
barrier.
* Weak references, as usual, complicate things. In particular, we must
ensure that the referee of a weak object is marked if dereferenced by
the mutator. For this we (unfortunately) must introduce a read
barrier, as described in Note [Concurrent read barrier on deRefWeak#]
(in `NonMovingMark.c`).
* Stable names are also a bit tricky as described in Note [Sweeping
stable names in the concurrent collector] (`NonMovingSweep.c`).
We take quite some pains to ensure that the high thread count often seen
in parallel Haskell applications doesn't affect pause times. To this end
we allow thread stacks to be marked either by the thread itself (when it
is executed or stack-underflows) or the concurrent mark thread (if the
thread owning the stack is never scheduled). There is a non-trivial
handshake to ensure that this happens without racing which is described
in Note [StgStack dirtiness flags and concurrent marking].
Co-Authored-by: Ömer Sinan Ağacan <omer@well-typed.com>
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This were previously quite unclear and will change a bit under the
non-moving collector so let's clear this up now.
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Here the following changes are introduced:
- A read barrier machine op is added to Cmm.
- The order in which a closure's fields are read and written is changed.
- Memory barriers are added to RTS code to ensure correctness on
out-or-order machines with weak memory ordering.
Cmm has a new CallishMachOp called MO_ReadBarrier. On weak memory machines, this
is lowered to an instruction that ensures memory reads that occur after said
instruction in program order are not performed before reads coming before said
instruction in program order. On machines with strong memory ordering properties
(e.g. X86, SPARC in TSO mode) no such instruction is necessary, so
MO_ReadBarrier is simply erased. However, such an instruction is necessary on
weakly ordered machines, e.g. ARM and PowerPC.
Weam memory ordering has consequences for how closures are observed and mutated.
For example, consider a closure that needs to be updated to an indirection. In
order for the indirection to be safe for concurrent observers to enter, said
observers must read the indirection's info table before they read the
indirectee. Furthermore, the entering observer makes assumptions about the
closure based on its info table contents, e.g. an INFO_TYPE of IND imples the
closure has an indirectee pointer that is safe to follow.
When a closure is updated with an indirection, both its info table and its
indirectee must be written. With weak memory ordering, these two writes can be
arbitrarily reordered, and perhaps even interleaved with other threads' reads
and writes (in the absence of memory barrier instructions). Consider this
example of a bad reordering:
- An updater writes to a closure's info table (INFO_TYPE is now IND).
- A concurrent observer branches upon reading the closure's INFO_TYPE as IND.
- A concurrent observer reads the closure's indirectee and enters it. (!!!)
- An updater writes the closure's indirectee.
Here the update to the indirectee comes too late and the concurrent observer has
jumped off into the abyss. Speculative execution can also cause us issues,
consider:
- An observer is about to case on a value in closure's info table.
- The observer speculatively reads one or more of closure's fields.
- An updater writes to closure's info table.
- The observer takes a branch based on the new info table value, but with the
old closure fields!
- The updater writes to the closure's other fields, but its too late.
Because of these effects, reads and writes to a closure's info table must be
ordered carefully with respect to reads and writes to the closure's other
fields, and memory barriers must be placed to ensure that reads and writes occur
in program order. Specifically, updates to a closure must follow the following
pattern:
- Update the closure's (non-info table) fields.
- Write barrier.
- Update the closure's info table.
Observing a closure's fields must follow the following pattern:
- Read the closure's info pointer.
- Read barrier.
- Read the closure's (non-info table) fields.
This patch updates RTS code to obey this pattern. This should fix long-standing
SMP bugs on ARM (specifically newer aarch64 microarchitectures supporting
out-of-order execution) and PowerPC. This fixes issue #15449.
Co-Authored-By: Ben Gamari <ben@well-typed.com>
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OVERWRITE_INFO already does zero slopping by calling OVERWRITING_CLOSURE
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There was a lock-order reversal between lockTSO() and the TVar lock,
see #15136 for the details.
It turns out we can fix this pretty easily by just deleting all the
locking code(!). The principle for unblocking a `BlockedOnSTM` thread
then becomes the same as for other kinds of blocking: if the TSO
belongs to this capability then we do it directly, otherwise we send a
message to the capability that owns the TSO. That is, a thread blocked
on STM is owned by its capability, as it should be.
The possible downside of this is that we might send multiple messages
to wake up a thread when the thread is on another capability. This is
safe, it's just not very efficient. I'll try to do some experiments
to see if this is a problem.
Test Plan: Test case from #15136 doesn't deadlock any more.
Reviewers: bgamari, osa1, erikd
Reviewed By: osa1
Subscribers: rwbarton, thomie, carter
GHC Trac Issues: #15136
Differential Revision: https://phabricator.haskell.org/D4956
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Summary:
get/setAllocationCounter didn't take into account allocations in the
current block. This was known at the time, but it turns out to be
important to have more accuracy when using these in a fine-grained
way.
Test Plan:
New unit test to test incrementally larger allocaitons. Before I got
results like this:
```
+0
+0
+0
+0
+0
+4096
+0
+0
+0
+0
+0
+4064
+0
+0
+4088
+4056
+0
+0
+0
+4088
+4096
+4056
+4096
```
Notice how the results aren't always monotonically increasing. After
this patch:
```
+344
+416
+488
+560
+632
+704
+776
+848
+920
+992
+1064
+1136
+1208
+1280
+1352
+1424
+1496
+1568
+1640
+1712
+1784
+1856
+1928
+2000
+2072
+2144
```
Reviewers: hvr, erikd, simonmar, jrtc27, trommler
Reviewed By: simonmar
Subscribers: trommler, jrtc27, rwbarton, thomie, carter
Differential Revision: https://phabricator.haskell.org/D4363
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Test Plan: Validate
Reviewers: erikd, simonmar
Reviewed By: simonmar
Subscribers: rwbarton, thomie, carter
Differential Revision: https://phabricator.haskell.org/D4374
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This reverts commit a1a689dda48113f3735834350fb562bb1927a633.
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Summary:
get/setAllocationCounter didn't take into account allocations in the
current block. This was known at the time, but it turns out to be
important to have more accuracy when using these in a fine-grained
way.
Test Plan:
New unit test to test incrementally larger allocaitons. Before I got
results like this:
```
+0
+0
+0
+0
+0
+4096
+0
+0
+0
+0
+0
+4064
+0
+0
+4088
+4056
+0
+0
+0
+4088
+4096
+4056
+4096
```
Notice how the results aren't always monotonically increasing. After
this patch:
```
+344
+416
+488
+560
+632
+704
+776
+848
+920
+992
+1064
+1136
+1208
+1280
+1352
+1424
+1496
+1568
+1640
+1712
+1784
+1856
+1928
+2000
+2072
+2144
```
Reviewers: niteria, bgamari, hvr, erikd
Subscribers: rwbarton, thomie, carter
Differential Revision: https://phabricator.haskell.org/D4288
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Reviewers: austin, bgamari, erikd, simonmar, trofi
Reviewed By: trofi
Subscribers: rwbarton, thomie
Differential Revision: https://phabricator.haskell.org/D4100
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Summary:
The calculation was too conservative, and could result in copying zero
frames into the new stack chunk, which caused a knock-on failure in
the interpreter.
Test Plan: Tested on an in-house repro (not shareable, unfortunately)
Reviewers: niteria, bgamari, austin, erikd
Subscribers: rwbarton, thomie
Differential Revision: https://phabricator.haskell.org/D4052
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Our new CPP linter enforces this.
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The C code in the RTS now gets built with `-Wundef` and the Haskell code
(stages 1 and 2 only) with `-Wcpp-undef`. We now get warnings whereever
`#if` is used on undefined identifiers.
Test Plan: Validate on Linux and Windows
Reviewers: austin, angerman, simonmar, bgamari, Phyx
Reviewed By: bgamari
Subscribers: thomie, snowleopard
Differential Revision: https://phabricator.haskell.org/D3278
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This is causing too much platform dependent breakage at the moment. We
will need a more rigorous testing strategy before this can be
merged again.
This reverts commit 7e340c2bbf4a56959bd1e95cdd1cfdb2b7e537c2.
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The C code in the RTS now gets built with `-Wundef` and the Haskell code
(stages 1 and 2 only) with `-Wcpp-undef`. We now get warnings whereever
`#if` is used on undefined identifiers.
Test Plan: Validate on Linux and Windows
Reviewers: austin, angerman, simonmar, bgamari, Phyx
Reviewed By: bgamari
Subscribers: thomie, snowleopard
Differential Revision: https://phabricator.haskell.org/D3278
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Test Plan: Validate on lots of platforms
Reviewers: erikd, simonmar, austin
Reviewed By: erikd, simonmar
Subscribers: michalt, thomie
Differential Revision: https://phabricator.haskell.org/D2699
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Summary:
This is a fast, non-blocking, asynchronous, interface to tryPutMVar that
can be called from C/C++.
It's useful for callback-based C/C++ APIs: the idea is that the callback
invokes hs_try_putmvar(), and the Haskell code waits for the callback to
run by blocking in takeMVar.
The callback doesn't block - this is often a requirement of
callback-based APIs. The callback wakes up the Haskell thread with
minimal overhead and no unnecessary context-switches.
There are a couple of benchmarks in
testsuite/tests/concurrent/should_run. Some example results comparing
hs_try_putmvar() with using a standard foreign export:
./hs_try_putmvar003 1 64 16 100 +RTS -s -N4 0.49s
./hs_try_putmvar003 2 64 16 100 +RTS -s -N4 2.30s
hs_try_putmvar() is 4x faster for this workload (see the source for
hs_try_putmvar003.hs for details of the workload).
An alternative solution is to use the IO Manager for this. We've tried
it, but there are problems with that approach:
* Need to create a new file descriptor for each callback
* The IO Manger thread(s) become a bottleneck
* More potential for things to go wrong, e.g. throwing an exception in
an IO Manager callback kills the IO Manager thread.
Test Plan: validate; new unit tests
Reviewers: niteria, erikd, ezyang, bgamari, austin, hvr
Subscribers: thomie
Differential Revision: https://phabricator.haskell.org/D2501
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The `nat` type was an alias for `unsigned int` with a comment saying
it was at least 32 bits. We keep the typedef in case client code is
using it but mark it as deprecated.
Test Plan: Validated on Linux, OS X and Windows
Reviewers: simonmar, austin, thomie, hvr, bgamari, hsyl20
Differential Revision: https://phabricator.haskell.org/D2166
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Noticed by uselex.rb:
wakeBlockingQueue: [R]: exported from:
./rts/dist/build/Threads.o
Signed-off-by: Sergei Trofimovich <siarheit@google.com>
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Summary: (see comment for details)
Test Plan: validate
Reviewers: bgamari, ezyang, austin
Subscribers: thomie
Differential Revision: https://phabricator.haskell.org/D1243
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Summary:
This was reverted in d70b19bfb5ed79b22c2ac31e22f46782fc47a117
and is a part of the reason for #10445.
Test Plan: validate
Reviewers: ezyang, simonmar, austin
Reviewed By: simonmar, austin
Subscribers: bgamari, thomie
Differential Revision: https://phabricator.haskell.org/D938
GHC Trac Issues: #8435
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The GranSim code was removed in dd56e9ab and 297b05a9 in 2009, and perhaps
other commits I couldn't find.
Reviewed By: austin
Differential Revision: https://phabricator.haskell.org/D737
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#10043)
Reviewers: austin, simonmar
Subscribers: thomie
Differential Revision: https://phabricator.haskell.org/D657
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This reverts commit f0fcc41d755876a1b02d1c7c79f57515059f6417.
New changes: now works on 32-bit platforms too. I added some basic
support for 64-bit subtraction and comparison operations to the x86
NCG.
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Signed-off-by: Austin Seipp <austin@well-typed.com>
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This reverts commit 39b5c1cbd8950755de400933cecca7b8deb4ffcd.
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This will hopefully help ensure some basic consistency in the forward by
overriding buffer variables. In particular, it sets the wrap length, the
offset to 4, and turns off tabs.
Signed-off-by: Austin Seipp <austin@well-typed.com>
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Problems were found on 32-bit platforms, I'll commit again when I have a fix.
This reverts the following commits:
54b31f744848da872c7c6366dea840748e01b5cf
b0534f78a73f972e279eed4447a5687bd6a8308e
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This tracks the amount of memory allocation by each thread in a
counter stored in the TSO. Optionally, when the counter drops below
zero (it counts down), the thread can be sent an asynchronous
exception: AllocationLimitExceeded. When this happens, given a small
additional limit so that it can handle the exception. See
documentation in GHC.Conc for more details.
Allocation limits are similar to timeouts, but
- timeouts use real time, not CPU time. Allocation limits do not
count anything while the thread is blocked or in foreign code.
- timeouts don't re-trigger if the thread catches the exception,
allocation limits do.
- timeouts can catch non-allocating loops, if you use
-fno-omit-yields. This doesn't work for allocation limits.
I couldn't measure any impact on benchmarks with these changes, even
for nofib/smp.
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This is encoded as RtsFlags.GcFlags.maxStkSize == 0.
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Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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Fixes #8303.
Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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This reverts commit d85044f6b201eae0a9e453b89c0433608e0778f0.
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When servicing a stack overflows, only throw an exception to the given
thread if the user explicitly set a max stack size, using +RTS -K.
Otherwise just service it normally and grow the stack.
In case we actually run out of *heap* (stack chuncks are allocated on
the heap), then we need to bail by calling the stackOverflow() hook and
exit immediately.
Authored-by: Ben Gamari <bgamari.foss@gmail.com>
Signed-off-by: Austin Seipp <aseipp@pobox.com>
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We have various problems with reallocating the array of Capabilities,
due to threads in waitForReturnCapability that are already holding a
pointer to a Capability.
Rather than add more locking to make this safer, I decided it would be
easier to ensure that we never move the Capabilities at all. The
capabilities array is now an array of pointers to Capabaility. There
are extra indirections, but it rarely matters - we don't often access
Capabilities via the array, normally we already have a pointer to
one. I ran the parallel benchmarks and didn't see any difference.
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We add the invariant to the MVar blocked threads queue that
threads blocked on an atomic read are always at the front of
the queue. This invariant is easy to maintain, since takers
are only ever added to the end of the queue.
Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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Previously, stacks were always attributed to CCCS_SYSTEM. Now, we
attribute them to the CCS when the stack was allocated. If a stack
grows, new stack chunks inherit the CCS of the old stack.
Signed-off-by: Edward Z. Yang <ezyang@mit.edu>
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lnat was originally "long unsigned int" but we were using it when we
wanted a 64-bit type on a 64-bit machine. This broke on Windows x64,
where long == int == 32 bits. Using types of unspecified size is bad,
but what we really wanted was a type with N bits on an N-bit machine.
StgWord is exactly that.
lnat was mentioned in some APIs that clients might be using
(e.g. StackOverflowHook()), so we leave it defined but with a comment
to say that it's deprecated.
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