Searched hist:50 (Results 126 - 150 of 671) sorted by relevance
/gem5/tests/configs/ | ||
H A D | learning-gem5-p1-two-level.py | diff 13619:44b5224b2ff4 Mon Jan 28 11:50:00 EST 2019 Andreas Sandberg <andreas.sandberg@arm.com> tests: Add a helper to run external scripts Some tests are really just a wrapper around a test script in configs/. Add a helper method to wrap these scripts to make sure they are executed in a consistent environment. This wrapper sets up a global environment that is identical to that created by main() when it executes the script. Unlike the old wrappers, it updates the module search path to make relative imports work correctly in Python 3. Change-Id: Ie9f81ec4e2689aa8cf5ecb9fc8025d3534b5c9ca Signed-off-by: Andreas Sandberg <andreas.sandberg@arm.com> Reviewed-on: https://gem5-review.googlesource.com/c/15976 Reviewed-by: Jason Lowe-Power <jason@lowepower.com> Maintainer: Jason Lowe-Power <jason@lowepower.com> |
/gem5/util/ | ||
H A D | encode_packet_trace.py | diff 10065:58bf21ca88de Tue Feb 18 05:50:00 EST 2014 Andreas Hansson <andreas.hansson@arm.com> util: Enhance the error messages for packet encode/decode This patch adds a more verbose error message when the Python protobuf module cannot be loaded. |
H A D | minorview.py | 10259:ebb376f73dd2 Wed Jul 23 17:09:00 EDT 2014 Andrew Bardsley <Andrew.Bardsley@arm.com> cpu: `Minor' in-order CPU model This patch contains a new CPU model named `Minor'. Minor models a four stage in-order execution pipeline (fetch lines, decompose into macroops, decompose macroops into microops, execute). The model was developed to support the ARM ISA but should be fixable to support all the remaining gem5 ISAs. It currently also works for Alpha, and regressions are included for ARM and Alpha (including Linux boot). Documentation for the model can be found in src/doc/inside-minor.doxygen and its internal operations can be visualised using the Minorview tool utils/minorview.py. Minor was designed to be fairly simple and not to engage in a lot of instruction annotation. As such, it currently has very few gathered stats and may lack other gem5 features. Minor is faster than the o3 model. Sample results: Benchmark | Stat host_seconds (s) ---------------+--------v--------v-------- (on ARM, opt) | simple | o3 | minor | timing | timing | timing ---------------+--------+--------+-------- 10.linux-boot | 169 | 1883 | 1075 10.mcf | 117 | 967 | 491 20.parser | 668 | 6315 | 3146 30.eon | 542 | 3413 | 2414 40.perlbmk | 2339 | 20905 | 11532 50.vortex | 122 | 1094 | 588 60.bzip2 | 2045 | 18061 | 9662 70.twolf | 207 | 2736 | 1036 |
/gem5/src/arch/x86/isa/insts/simd128/floating_point/data_transfer/ | ||
H A D | move.py | diff 6698:21047815f78e Wed Oct 28 02:50:00 EDT 2009 Gabe Black <gblack@eecs.umich.edu> X86: Replace "DISPLACEMENT" with disp in movhpd. |
/gem5/configs/topologies/ | ||
H A D | BaseTopology.py | diff 9148:a7a72f42919e Fri Aug 10 14:50:00 EDT 2012 Jason Power <powerjg@cs.wisc.edu> Ruby: Clean up topology changes This patch moves instantiateTopology into Ruby.py and removes the mem/ruby/network/topologies directory. It also adds some extra inheritance to the topologies to clean up some issues in the existing topologies. |
/gem5/src/dev/x86/ | ||
H A D | I8259.py | diff 9162:019047ead23b Tue Aug 21 05:50:00 EDT 2012 Andreas Hansson <andreas.hansson@arm.com> Device: Remove overloaded pio_latency parameter This patch removes the overloading of the parameter, which seems both redundant, and possibly incorrect. The PciConfigAll now also uses a Param.Latency rather than a Param.Tick. For backwards compatibility it still sets the pio_latency to 1 tick. All the comments have also been updated to not state that it is in simticks when it is not necessarily the case. |
H A D | Cmos.py | diff 9162:019047ead23b Tue Aug 21 05:50:00 EDT 2012 Andreas Hansson <andreas.hansson@arm.com> Device: Remove overloaded pio_latency parameter This patch removes the overloading of the parameter, which seems both redundant, and possibly incorrect. The PciConfigAll now also uses a Param.Latency rather than a Param.Tick. For backwards compatibility it still sets the pio_latency to 1 tick. All the comments have also been updated to not state that it is in simticks when it is not necessarily the case. |
H A D | I8254.py | diff 9162:019047ead23b Tue Aug 21 05:50:00 EDT 2012 Andreas Hansson <andreas.hansson@arm.com> Device: Remove overloaded pio_latency parameter This patch removes the overloading of the parameter, which seems both redundant, and possibly incorrect. The PciConfigAll now also uses a Param.Latency rather than a Param.Tick. For backwards compatibility it still sets the pio_latency to 1 tick. All the comments have also been updated to not state that it is in simticks when it is not necessarily the case. |
/gem5/src/cpu/pred/ | ||
H A D | ras.cc | diff 7720:65d338a8dba4 Sun Oct 31 03:07:00 EDT 2010 Gabe Black <gblack@eecs.umich.edu> ISA,CPU,etc: Create an ISA defined PC type that abstracts out ISA behaviors. This change is a low level and pervasive reorganization of how PCs are managed in M5. Back when Alpha was the only ISA, there were only 2 PCs to worry about, the PC and the NPC, and the lsb of the PC signaled whether or not you were in PAL mode. As other ISAs were added, we had to add an NNPC, micro PC and next micropc, x86 and ARM introduced variable length instruction sets, and ARM started to keep track of mode bits in the PC. Each CPU model handled PCs in its own custom way that needed to be updated individually to handle the new dimensions of variability, or, in the case of ARMs mode-bit-in-the-pc hack, the complexity could be hidden in the ISA at the ISA implementation's expense. Areas like the branch predictor hadn't been updated to handle branch delay slots or micropcs, and it turns out that had introduced a significant (10s of percent) performance bug in SPARC and to a lesser extend MIPS. Rather than perpetuate the problem by reworking O3 again to handle the PC features needed by x86, this change was introduced to rework PC handling in a more modular, transparent, and hopefully efficient way. PC type: Rather than having the superset of all possible elements of PC state declared in each of the CPU models, each ISA defines its own PCState type which has exactly the elements it needs. A cross product of canned PCState classes are defined in the new "generic" ISA directory for ISAs with/without delay slots and microcode. These are either typedef-ed or subclassed by each ISA. To read or write this structure through a *Context, you use the new pcState() accessor which reads or writes depending on whether it has an argument. If you just want the address of the current or next instruction or the current micro PC, you can get those through read-only accessors on either the PCState type or the *Contexts. These are instAddr(), nextInstAddr(), and microPC(). Note the move away from readPC. That name is ambiguous since it's not clear whether or not it should be the actual address to fetch from, or if it should have extra bits in it like the PAL mode bit. Each class is free to define its own functions to get at whatever values it needs however it needs to to be used in ISA specific code. Eventually Alpha's PAL mode bit could be moved out of the PC and into a separate field like ARM. These types can be reset to a particular pc (where npc = pc + sizeof(MachInst), nnpc = npc + sizeof(MachInst), upc = 0, nupc = 1 as appropriate), printed, serialized, and compared. There is a branching() function which encapsulates code in the CPU models that checked if an instruction branched or not. Exactly what that means in the context of branch delay slots which can skip an instruction when not taken is ambiguous, and ideally this function and its uses can be eliminated. PCStates also generally know how to advance themselves in various ways depending on if they point at an instruction, a microop, or the last microop of a macroop. More on that later. Ideally, accessing all the PCs at once when setting them will improve performance of M5 even though more data needs to be moved around. This is because often all the PCs need to be manipulated together, and by getting them all at once you avoid multiple function calls. Also, the PCs of a particular thread will have spatial locality in the cache. Previously they were grouped by element in arrays which spread out accesses. Advancing the PC: The PCs were previously managed entirely by the CPU which had to know about PC semantics, try to figure out which dimension to increment the PC in, what to set NPC/NNPC, etc. These decisions are best left to the ISA in conjunction with the PC type itself. Because most of the information about how to increment the PC (mainly what type of instruction it refers to) is contained in the instruction object, a new advancePC virtual function was added to the StaticInst class. Subclasses provide an implementation that moves around the right element of the PC with a minimal amount of decision making. In ISAs like Alpha, the instructions always simply assign NPC to PC without having to worry about micropcs, nnpcs, etc. The added cost of a virtual function call should be outweighed by not having to figure out as much about what to do with the PCs and mucking around with the extra elements. One drawback of making the StaticInsts advance the PC is that you have to actually have one to advance the PC. This would, superficially, seem to require decoding an instruction before fetch could advance. This is, as far as I can tell, realistic. fetch would advance through memory addresses, not PCs, perhaps predicting new memory addresses using existing ones. More sophisticated decisions about control flow would be made later on, after the instruction was decoded, and handed back to fetch. If branching needs to happen, some amount of decoding needs to happen to see that it's a branch, what the target is, etc. This could get a little more complicated if that gets done by the predecoder, but I'm choosing to ignore that for now. Variable length instructions: To handle variable length instructions in x86 and ARM, the predecoder now takes in the current PC by reference to the getExtMachInst function. It can modify the PC however it needs to (by setting NPC to be the PC + instruction length, for instance). This could be improved since the CPU doesn't know if the PC was modified and always has to write it back. ISA parser: To support the new API, all PC related operand types were removed from the parser and replaced with a PCState type. There are two warts on this implementation. First, as with all the other operand types, the PCState still has to have a valid operand type even though it doesn't use it. Second, using syntax like PCS.npc(target) doesn't work for two reasons, this looks like the syntax for operand type overriding, and the parser can't figure out if you're reading or writing. Instructions that use the PCS operand (which I've consistently called it) need to first read it into a local variable, manipulate it, and then write it back out. Return address stack: The return address stack needed a little extra help because, in the presence of branch delay slots, it has to merge together elements of the return PC and the call PC. To handle that, a buildRetPC utility function was added. There are basically only two versions in all the ISAs, but it didn't seem short enough to put into the generic ISA directory. Also, the branch predictor code in O3 and InOrder were adjusted so that they always store the PC of the actual call instruction in the RAS, not the next PC. If the call instruction is a microop, the next PC refers to the next microop in the same macroop which is probably not desirable. The buildRetPC function advances the PC intelligently to the next macroop (in an ISA specific way) so that that case works. Change in stats: There were no change in stats except in MIPS and SPARC in the O3 model. MIPS runs in about 9% fewer ticks. SPARC runs with 30%-50% fewer ticks, which could likely be improved further by setting call/return instruction flags and taking advantage of the RAS. TODO: Add != operators to the PCState classes, defined trivially to be !(a==b). Smooth out places where PCs are split apart, passed around, and put back together later. I think this might happen in SPARC's fault code. Add ISA specific constructors that allow setting PC elements without calling a bunch of accessors. Try to eliminate the need for the branching() function. Factor out Alpha's PAL mode pc bit into a separate flag field, and eliminate places where it's blindly masked out or tested in the PC. 6226:f1076450ab2b Fri Jun 05 00:50:00 EDT 2009 Nathan Binkert <nate@binkert.org> move: put predictor includes and cc files into the same place |
H A D | ras.hh | diff 7720:65d338a8dba4 Sun Oct 31 03:07:00 EDT 2010 Gabe Black <gblack@eecs.umich.edu> ISA,CPU,etc: Create an ISA defined PC type that abstracts out ISA behaviors. This change is a low level and pervasive reorganization of how PCs are managed in M5. Back when Alpha was the only ISA, there were only 2 PCs to worry about, the PC and the NPC, and the lsb of the PC signaled whether or not you were in PAL mode. As other ISAs were added, we had to add an NNPC, micro PC and next micropc, x86 and ARM introduced variable length instruction sets, and ARM started to keep track of mode bits in the PC. Each CPU model handled PCs in its own custom way that needed to be updated individually to handle the new dimensions of variability, or, in the case of ARMs mode-bit-in-the-pc hack, the complexity could be hidden in the ISA at the ISA implementation's expense. Areas like the branch predictor hadn't been updated to handle branch delay slots or micropcs, and it turns out that had introduced a significant (10s of percent) performance bug in SPARC and to a lesser extend MIPS. Rather than perpetuate the problem by reworking O3 again to handle the PC features needed by x86, this change was introduced to rework PC handling in a more modular, transparent, and hopefully efficient way. PC type: Rather than having the superset of all possible elements of PC state declared in each of the CPU models, each ISA defines its own PCState type which has exactly the elements it needs. A cross product of canned PCState classes are defined in the new "generic" ISA directory for ISAs with/without delay slots and microcode. These are either typedef-ed or subclassed by each ISA. To read or write this structure through a *Context, you use the new pcState() accessor which reads or writes depending on whether it has an argument. If you just want the address of the current or next instruction or the current micro PC, you can get those through read-only accessors on either the PCState type or the *Contexts. These are instAddr(), nextInstAddr(), and microPC(). Note the move away from readPC. That name is ambiguous since it's not clear whether or not it should be the actual address to fetch from, or if it should have extra bits in it like the PAL mode bit. Each class is free to define its own functions to get at whatever values it needs however it needs to to be used in ISA specific code. Eventually Alpha's PAL mode bit could be moved out of the PC and into a separate field like ARM. These types can be reset to a particular pc (where npc = pc + sizeof(MachInst), nnpc = npc + sizeof(MachInst), upc = 0, nupc = 1 as appropriate), printed, serialized, and compared. There is a branching() function which encapsulates code in the CPU models that checked if an instruction branched or not. Exactly what that means in the context of branch delay slots which can skip an instruction when not taken is ambiguous, and ideally this function and its uses can be eliminated. PCStates also generally know how to advance themselves in various ways depending on if they point at an instruction, a microop, or the last microop of a macroop. More on that later. Ideally, accessing all the PCs at once when setting them will improve performance of M5 even though more data needs to be moved around. This is because often all the PCs need to be manipulated together, and by getting them all at once you avoid multiple function calls. Also, the PCs of a particular thread will have spatial locality in the cache. Previously they were grouped by element in arrays which spread out accesses. Advancing the PC: The PCs were previously managed entirely by the CPU which had to know about PC semantics, try to figure out which dimension to increment the PC in, what to set NPC/NNPC, etc. These decisions are best left to the ISA in conjunction with the PC type itself. Because most of the information about how to increment the PC (mainly what type of instruction it refers to) is contained in the instruction object, a new advancePC virtual function was added to the StaticInst class. Subclasses provide an implementation that moves around the right element of the PC with a minimal amount of decision making. In ISAs like Alpha, the instructions always simply assign NPC to PC without having to worry about micropcs, nnpcs, etc. The added cost of a virtual function call should be outweighed by not having to figure out as much about what to do with the PCs and mucking around with the extra elements. One drawback of making the StaticInsts advance the PC is that you have to actually have one to advance the PC. This would, superficially, seem to require decoding an instruction before fetch could advance. This is, as far as I can tell, realistic. fetch would advance through memory addresses, not PCs, perhaps predicting new memory addresses using existing ones. More sophisticated decisions about control flow would be made later on, after the instruction was decoded, and handed back to fetch. If branching needs to happen, some amount of decoding needs to happen to see that it's a branch, what the target is, etc. This could get a little more complicated if that gets done by the predecoder, but I'm choosing to ignore that for now. Variable length instructions: To handle variable length instructions in x86 and ARM, the predecoder now takes in the current PC by reference to the getExtMachInst function. It can modify the PC however it needs to (by setting NPC to be the PC + instruction length, for instance). This could be improved since the CPU doesn't know if the PC was modified and always has to write it back. ISA parser: To support the new API, all PC related operand types were removed from the parser and replaced with a PCState type. There are two warts on this implementation. First, as with all the other operand types, the PCState still has to have a valid operand type even though it doesn't use it. Second, using syntax like PCS.npc(target) doesn't work for two reasons, this looks like the syntax for operand type overriding, and the parser can't figure out if you're reading or writing. Instructions that use the PCS operand (which I've consistently called it) need to first read it into a local variable, manipulate it, and then write it back out. Return address stack: The return address stack needed a little extra help because, in the presence of branch delay slots, it has to merge together elements of the return PC and the call PC. To handle that, a buildRetPC utility function was added. There are basically only two versions in all the ISAs, but it didn't seem short enough to put into the generic ISA directory. Also, the branch predictor code in O3 and InOrder were adjusted so that they always store the PC of the actual call instruction in the RAS, not the next PC. If the call instruction is a microop, the next PC refers to the next microop in the same macroop which is probably not desirable. The buildRetPC function advances the PC intelligently to the next macroop (in an ISA specific way) so that that case works. Change in stats: There were no change in stats except in MIPS and SPARC in the O3 model. MIPS runs in about 9% fewer ticks. SPARC runs with 30%-50% fewer ticks, which could likely be improved further by setting call/return instruction flags and taking advantage of the RAS. TODO: Add != operators to the PCState classes, defined trivially to be !(a==b). Smooth out places where PCs are split apart, passed around, and put back together later. I think this might happen in SPARC's fault code. Add ISA specific constructors that allow setting PC elements without calling a bunch of accessors. Try to eliminate the need for the branching() function. Factor out Alpha's PAL mode pc bit into a separate flag field, and eliminate places where it's blindly masked out or tested in the PC. 6226:f1076450ab2b Fri Jun 05 00:50:00 EDT 2009 Nathan Binkert <nate@binkert.org> move: put predictor includes and cc files into the same place |
/gem5/src/arch/x86/isa/decoder/ | ||
H A D | x87.isa | diff 10044:42e058cae3d0 Mon Jan 27 19:50:00 EST 2014 Nilay Vaish <nilay@cs.wisc.edu> x86: implements x87 add/sub instructions diff 10043:301f2c0b3423 Mon Jan 27 19:50:00 EST 2014 Nilay Vaish <nilay@cs.wisc.edu> x86: implements fxch instruction. |
/gem5/tests/long/fs/10.linux-boot/ref/alpha/linux/tsunami-o3-dual/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/tests/long/fs/10.linux-boot/ref/alpha/linux/tsunami-o3/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/tests/quick/se/00.hello/ref/alpha/linux/o3-timing/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/tests/quick/se/00.hello/ref/mips/linux/o3-timing/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/src/sim/ | ||
H A D | stat_control.hh | diff 7823:dac01f14f20f Sat Jan 08 00:50:00 EST 2011 Steve Reinhardt <steve.reinhardt@amd.com> Replace curTick global variable with accessor functions. This step makes it easy to replace the accessor functions (which still access a global variable) with ones that access per-thread curTick values. diff 7822:fc475ac7d2a4 Sat Jan 08 00:50:00 EST 2011 Steve Reinhardt <steve.reinhardt@amd.com> stats: rename StatEvent() function to schedStatEvent(). This follows the style rules and is more descriptive. |
/gem5/tests/long/fs/10.linux-boot/ref/arm/linux/realview-o3-dual/ | ||
H A D | simerr | diff 11957:90bb43dfc028 Wed Mar 29 21:50:00 EDT 2017 Gabe Black <gabeblack@google.com> stats: Update ARM FS stats. The change below changed the behavior of interrupts on ARM and changed the stats for the 10.linux-boot regression. commit 746e2f3c27ad83c36b7bc3b8bd3c92004fcf995b Author: Sudhanshu Jha <sudhanshu.jha@arm.com> Date: Mon Feb 27 10:29:56 2017 +0000 arm, kmi: Clear interrupts in KMI devices Change-Id: Ie1cfc26777f6ed2d3fd4340175941fda1fdb5b6a Reviewed-on: https://gem5-review.googlesource.com/2653 Maintainer: Andreas Sandberg <andreas.sandberg@arm.com> Reviewed-by: Andreas Sandberg <andreas.sandberg@arm.com> Reviewed-by: Jason Lowe-Power <jason@lowepower.com> diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/tests/long/se/10.mcf/ref/arm/linux/o3-timing/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
/gem5/tests/long/se/10.mcf/ref/x86/linux/o3-timing/ | ||
H A D | config.ini | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
H A D | simout | diff 10242:cb4e86c17767 Sun Jun 22 17:33:00 EDT 2014 Steve Reinhardt <steve.reinhardt@amd.com> stats: update for O3 changes Mostly small differences in total ticks, but O3 stall causes shifted significantly. 30.eon does speed up by ~6% on Alpha and ARM, and 50.vortex by 4.5% on ARM. At the other extreme, X86 70.twolf is 0.8% slower. diff 9348:44d31345e360 Fri Nov 02 12:50:00 EDT 2012 Ali Saidi <Ali.Saidi@ARM.com> update stats for preceeding changes |
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