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Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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This patch merely tidies up the CPU and ThreadContext getters by
making them const where appropriate.
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The table walker code currently accounts for two types of walks,
Atomic and Timing, and treats them differently. Atomic walks keep a
single instance of WalkerState around for all walks to use in
currState. Timing mode keeps a queue of in-flight WalkerStates and
maintains currState as NULL between walks.
If a functional walk is done during Timing mode, it is treated as an
atomic walk and either creates a persistent WalkerState if in between
Timing walks, or stomps an existing currState for an in-progress
Timing walk.
This patch distinguishes functional walks as being able to exist at
any time and sets up a temporary WalkerState for its exclusive use and
then cleans up when finished, leaving any in progress Atomic or Timing
walks undisturbed.
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This patch fixes an assert condition that is not true at all
times. There are valid situations that arise in dual-core
dual-workload runs where the assert condition is false. The function
call following the assert however needs to be called only when the
condition is true (a block cannot be invalidated in the tags structure
if has not been allocated in the structure, and the tempBlock is never
allocated). Hence the 'assert' has been replaced with an 'if'.
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This patch changes the decode script to output the optional fields of
the proto message Packet, namely id and flags. The flags field is set
by the communication monitor.
The id field is useful for CPU trace experiments, e.g. linking the
fetch side to decode side. It had to be renamed because it clashes
with a built in python function id() for getting the "identity" of an
object.
This patch also takes a few common function definitions out from the
multiple scripts and adds them to a protolib python module.
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This snippet can be used to replace if + {panics, fatals, asserts} constructs.
The idea is to have both the condition checking and a verbose printout in a single statement. The interface is as follows:
panic_if(foo != bar, "These should be equal: foo %i bar %i", foo, bar);
fatal_if(foo != bar, "These should be equal: foo %i bar %i", foo, bar);
chatty_assert(foo == bar, "These should be equal: foo %i bar %i", foo, bar);
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Small fixes to appease recent clang versions.
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Small fix for a warning that prevents compilation with gcc 4.8.1 due
to detecting that a variable might be uninitialised. The fix is to
assign a safe default.
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For systems without caches, the LLSC code does not get snoops for
wake-ups. We add the LLSC code in the abstract memory to do the job
for us.
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The global synchronization event used to be scheduled at
simQuantum. This prevented repeated entries into gem5 from Python as
it can be scheduled in the past. This changeset ensures that the first
global synchronization happens at curTick() + simQuantum instead.
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The TSL/LDT & TR/TSS segments didn't contain valid attributes. This
caused problems when transfering the state into KVM where invalid
state is a no-go. Fixup the attributes with values from AMD's
architecture programmer's manual.
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When transferring segment registers into kvm, we need to find the
value of the unusable bit. We used to assume that this could be
inferred from the selector since segments are generally unusable if
their selector is 0. This assumption breaks in some weird corner
cases. Instead, we just assume that segments are always usable. This
is what qemu does so it should work.
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Signal handlers in KVM are controlled per thread and should be
initialized from the thread that is going to execute the CPU. This
changeset moves the initialization call from startup() to
startupThread().
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The last pop operation is now tracked as a Tick instead of in Cycles.
This helps in avoiding use of the receiver's clock during the enqueue
operation.
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A copyRegs() function is added to MIPS utilities
to copy architectural state from the old CPU to
the new CPU during fast-forwarding. This
addition alone enables fast-forwarding for the
o3 cpu model running MIPS.
The patch also adds takeOverFrom() and
drainResume() functions to the InOrderCPU to
enable it to take over from another CPU. This
change enables fast-forwarding for the inorder
cpu model running MIPS, but not for Alpha.
Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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Couple of users observed segmentation fault when the simulator tries to
register the statistical variable m_IncompleteTimes. It seems that there
is some problem with the initialization of these variables when allocated
in the constructor.
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Currently, the interrupt controller in x86 is connected to the io bus
directly. Therefore the packets between the io devices and the interrupt
controller do not go through ruby. This patch changes ruby port so that
these packets arrive at the ruby port first, which then routes them to their
destination. Note that the patch does not make these packets go through the
ruby network. That would happen in a subsequent patch.
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This patch simplfies the retry logic in the RubyPort, avoiding
redundant attributes, and enforcing more stringent checks on the
interactions with the normal ports. The patch also simplifies the
routing done by the RubyPort, using the port identifiers instead of a
heavy-weight sender state.
The patch also fixes a bug in the sending of responses from PIO
ports. Previously these responses bypassed the queue in the queued
port, and ignored the return value, potentially leading to response
packets being lost.
Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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Code in two of the functions was exactly the same. This patch moves
this code to a new function which is called from the two functions
mentioned initially.
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At several places, there are functions that take a cycle value as input
and performs some computation. Along with each such function, another
function was being defined that simply added one more cycle to input and
computed the same function. This patch removes this second copy of the
function. Places where these functions were being called have been updated
to use the original function with argument being current cycle + 1.
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Two files had been incorrectly named with a .cache suffix.
--HG--
rename : src/mem/protocol/MESI_Three_Level-L0.cache => src/mem/protocol/MESI_Three_Level-L0cache.sm
rename : src/mem/protocol/MESI_Three_Level-L1.cache => src/mem/protocol/MESI_Three_Level-L1cache.sm
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The introduction of parallel event queues added most of the support
needed to run multiple VMs (systems) within the same gem5
instance. This changeset fixes up signal delivery so that KVM's
control signals are delivered to the thread that executes the CPU's
event queue. Specifically:
* Timers and counters are now initialized from a separate method
(startupThread) that is scheduled as the first event in the
thread-specific event queue. This ensures that they are
initialized from the thread that is going to execute the CPUs
event queue and enables signal delivery to the right thread when
exiting from KVM.
* The POSIX-timer-based KVM timer (used to force exits from KVM) has
been updated to deliver signals to the thread that's executing KVM
instead of the process (thread is undefined in that case). This
assumes that the timer is instantiated from the thread that is
going to execute the KVM vCPU.
* Signal masking is now done using pthread_sigmask instead of
sigprocmask. The behavior of the latter is undefined in threaded
applications.
* Since signal masks can be inherited, make sure to actively unmask
the control signals when setting up the KVM signal mask.
There are currently no facilities to multiplex between multiple KVM
CPUs in the same event queue, we are therefore limited to
configurations where there is only one KVM CPU per event queue. In
practice, this means that multi-system configurations can be
simulated, but not multiple CPUs in a shared-memory configuration.
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This patch fixes a bug in how physical memory used to be mapped and
unmapped. Previously we unmapped and re-mapped if restoring from a
checkpoint. However, we never checked that the new mapping was
actually the same, it was just magically working as the OS seems to
fairly reliably give us the same chunk back. This patch fixes this
issue by relying entirely on the mmap call in the constructor.
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This patch enbles use of the basic PIO devices as part of the NULL
build. Although it might seem counter intuitive to have a PIO device
without being able to execute a driver, this change enables us to
break a device class hierarchy into an ISA-agnostic part, and an
ISA-specific part, without requiring multiple-inheritance. The
ISA-agnostic base class is a PIO device, but does not make use of the
port.
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This patch adds a filter to the cache to drop snoop requests that are
not for a range covered by the cache. This fixes an issue observed
when multiple caches are placed in parallel, covering different
address ranges. Without this patch, all the caches will forward the
snoop upwards, when only one should do so.
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This patch adds DRAMSim2 as a memory controller by wrapping the
external library and creating a sublass of AbstractMemory that bridges
between the semantics of gem5 and the DRAMSim2 interface.
The DRAMSim2 wrapper extracts the clock period from the config
file. There is no way of extracting this information from DRAMSim2
itself, so we simply read the same config file and get it from there.
To properly model the response queue, the wrapper keeps track of how
many transactions are in the actual controller, and how many are
stacking up waiting to be sent back as responses (in the wrapper). The
latter requires us to move away from the queued port and manage the
packets ourselves. This is due to DRAMSim2 not having any flow control
on the response path.
DRAMSim2 assumes that the transactions it is given are matching the
burst size of the choosen memory. The wrapper checks to ensure the
cache line size of the system matches the burst size of DRAMSim2 as
there are currently no provisions to split the system requests. In
theory we could allow a cache line size smaller than the burst size,
but that would lead to inefficient use of the DRAM, so for not we
fatal also in this case.
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Minor fix of the debug message parameters.
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This changesets adds branch predictor support to the
BaseSimpleCPU. The simple CPUs normally don't need a branch predictor,
however, there are at least two cases where it can be desirable:
1) A simple CPU can be used to warm the branch predictor of an O3
CPU before switching to the slower O3 model.
2) The simple CPU can be used as a quick way of evaluating/debugging
new branch predictors since it exposes branch predictor
statistics.
Limitations:
* Since the simple CPU doesn't speculate, only one instruction will
be active in the branch predictor at a time (i.e., the branch
predictor will never see speculative branches).
* The outcome of a branch prediction does not affect the performance
of the simple CPU.
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Currently fatal() ends the simulation in a normal fashion. This results in
the call stack getting lost when using a debugger and it is not always
possible to debug the simulation just from the information provided by the
printed error message. Even though the error is likely due to a user's fault,
the information available should not be thrown away. Hence, this patch to
call abort() from fatal().
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Changeset 7274310be1bb (isa: clean up register constants) increased
the value of NumFloatRegs, which triggered a bug in
X86ISA::copyRegs(). This bug is caused by the x87 stack being copied
twice since register indexes past NUM_FLOATREGS are mapped into the
x87 stack relative to the top of the stack, which is undefined when
the copy takes place.
This changeset updates the copyRegs() function to use access registers
using the non-flattening interface, which guarantees that undesirable
register folding does not happen.
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The getRFlags and setRFlags utility functions were not updated
correctly when condition registers were separated into their own
register class. This lead to incorrect state transfer in calls from
kvm into the simulator (e.g., m5 readfile ended up in an infinite
loop) and when switching CPUs. This patch makes these utility
functions use getCCReg and setCCReg instead of getIntReg and setIntReg
which read and write the integer registers.
Reviewed-by: Andreas Sandberg <andreas@sandberg.pp.se>
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Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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Forces the prefetcher to mispredict twice in a row before resetting the
confidence of prefetching. This helps cases where a load PC strides by a
constant factor, however it may operate on different arrays at times.
Avoids the cost of retraining. Primarily helps with small iteration loops.
Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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For systems with a tightly coupled L2, a stride-based prefetcher may observe
access requests from both instruction and data L1 caches. However, the PC
address of an instruction miss gives no relevant training information to the
stride based prefetcher(there is no stride to train). In theses cases, its
better if the L2 stride prefetcher simply reverted back to a simple N-block
ahead prefetcher. This patch enables this option.
Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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This patch extends the classic prefetcher to work on non-block aligned
addresses. Because the existing prefetchers in gem5 mask off the lower
address bits of cache accesses, many predictable strides fail to be
detected. For example, if a load were to stride by 48 bytes, with 64 byte
cachelines, the current stride based prefetcher would see an access pattern
of 0, 64, 64, 128, 192.... Thus not detecting a constant stride pattern. This
patch fixes this, by training the prefetcher on access and not masking off the
lower address bits.
It also adds the following configuration options:
1) Training/prefetching only on cache misses,
2) Training/prefetching only on data acceses,
3) Optionally tagging prefetches with a PC address.
#3 allows prefetchers to train off of prefetch requests in systems with
multiple cache levels and PC-based prefetchers present at multiple levels.
It also effectively allows a pipelining of prefetch requests (like in POWER4)
across multiple levels of cache hierarchy.
Improves performance on my gem5 configuration by 4.3% for SPECINT and 4.7% for SPECFP (geomean).
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Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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gem5 makes the incorrect assumption that by binding a socket, it
effectively has allocated a port. Linux only allocates ports once you call
listen on the given socket, not when you call bind. So even if the port was
free when bind was called, another process (gem5 instance) could race in
between the bind & listen calls and steal the port. In the current code, if
the call to bind fails due to the port being in use (EADDRINUSE), gem5 retries
for a different port. However if listen fails, gem5 just panics. The fix is
testing the return value of listen and re-trying if it was due to EADDRINUSE.
Committed by: Nilay Vaish <nilay@cs.wisc.edu>
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