With this, the register RAM is read synchronously using the addresses
supplied by decode1. That means the register RAM can now be block RAM
rather than LUT RAM.
Debug accesses are done via the B port on cycles when decode1
indicates that there is no valid instruction or the instruction
doesn't use a [F]RB operand.
We latch the addresses being read in each cycle and use the same
address next cycle if stalled. Data that is being written is latched
and a multiplexer on each read port then supplies the latched write
data if the read address for that port equals the write address.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This adds some relatively simple logic to decode1 to compute the
GPR/FPR addresses that an instruction will access. It always computes
three addresses regardless of whether the instruction will actually
use all of them. The main things it computes are whether the
instruction uses the RS field or the RC field for the 3rd operand, and
whether the operands are FPRs or GPRs (it is possible for RS to be an
FPR but RA and RB to be GPRs, as for example with stfdx).
At the moment all we do with these computed register addresses is to
assert that they are identical to the ones coming from decode2 one
cycle later.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This eliminates one leg of the output value multiplexer, and seems
to improve timing slightly on the A7-100.
Since SPR values are written in stage 3 and read in stage 2, an mfspr
immediately following an mtspr to the same SPR won't give the correct
value. To avoid this, we make mtspr to the load/store SPRs single
issue in decode1.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This provides access to the SPRs via the JTAG DMI interface. For now
they are still accessed as if they were GPR/FPRs using the same
numbering as before (GPRs at 0 - 0x1f, SPRs at 0x20 - 0x2d, FPRs at
0x40 - 0x5f).
For XER, debug reads now report the full value, not just the bits that
were previously stored in the register file. The "slow" SPR mux is
not used for debug reads.
Decode2 determines on each cycle whether a debug SPR access will
happen next cycle, based on whether there is a request and whether the
current instruction accesses the SPR RAM.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
With this, the register file now contains 64 entries, for 32 GPRs and
32 FPRs, rather than the 128 it had previously. Several things get
simplified - decode1 no longer has to work out the ispr{1,2,o} values,
decode_input_reg_{a,b,c} no longer have the t = SPR case, etc.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
By putting CTR on the odd side and LR and TAR on the even side, we can
read and write CTR for bdnz-style instructions in parallel with
reading LR or TAR for indirect branches and writing LR for branches
with LK=1. Thus we don't need to double up any of these instructions,
giving a simplification in decode2.
We now have logic for printing LR and CTR at the end of a simulation
in execute1, in addition to the similar logic in register_file and
cr_file.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This starts the process of removing SPRs from the register file by
moving SRR0/1, SPRG0-3, HSRR0/1 and HSPRG0/1 out of the register file
and putting them into execute1. They are stored in a pair of small
RAM arrays, referred to as "even" and "odd". The reason for having
two arrays is so that two values can be read and written in each
cycle. For example, SRR0 and SRR1 can be written in parallel by an
interrupt and read in parallel by the rfid instruction.
The addresses in the RAM which will be accessed are determined in the
decode2 stage. We have one write address for both sides, but two read
addresses, since in future we will want to be able to read CTR at the
same time as either LR or TAR.
We now have a connection from writeback to execute1 which carries the
partial SRR1 value for an interrupt. SRR0 comes from the execute
pipeline; we no longer need to carry instruction addresses along the
LSU and FPU pipelines. Since SRR0 and SRR1 can be written in the same
cycle now, we don't need the little state machine in writeback any
more.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
- Arrange for XER to be written for OE=1 forms
- Arrange for condition codes to be set for RC=1 forms
(including correct handling for 32-bit mode)
- Don't instantiate the divider if we have an FPU.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This adds logic to the FPU to accomplish 64-bit integer divisions.
No instruction actually uses this yet.
The algorithm used is to obtain an estimate of the reciprocal of the
divisor using the lookup table and refine it by one to three
iterations of the Newton-Raphson algorithm (the number of iterations
depends on the number of significant bits in the dividend). Then the
reciprocal is multiplied by the dividend to get the quotient estimate.
The remainder is calculated as dividend - quotient * divisor. If the
remainder is greater than or equal to the divisor, the quotient is
incremented, or if a modulo operation is being done, the divisor is
subtracted from the remainder. The inverse estimate after refinement
is good enough that the quotient estimate is always equal to or one
less than the true quotient.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This changes the representation of the R, A, B and C registers in the
FPU from 10.54 format (10 bits to the left of the binary point and 54
bits to the right) to 8.56 format, to match the representation used in
the P and Y registers and the multiplier operands. This eliminates
the need for shifting when R, A, B or C is an input to the multiplier
and will make it easier to implement integer division in the FPU.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This provides a mechanism for tracking updates to the XER overflow
bits (SO, OV, OV32) and stalling instructions which need current
values of those bits (mfxer, integer compare instructions, integer
Rc=1 instructions, addex) or which writes carry bits (since all the
XER common bits are written together, if we are writing CA/CA32 we
need up-to-date values of SO/OV/OV32).
This will enable updates to SO/OV/OV32 to be done at other places
besides the ex1 stage.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This fixes a bug which prevents the core from stopping properly. The
same bug was previously fixed in commit e41cb01bca ("fetch1: Fix
debug stop", 2020-12-19) and reintroduced by commit 0fb207be60
("fetch1: Implement a simple branch target cache", 2020-12-19).
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This lets us get rid of r_int and its 'outstanding' counter. We now
test more directly for excess completions by checking that we don't
get duplicate completions for the same tag.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
Now that the timing of the busy signal from decode2 doesn't depend on
register numbers or downstream instruction completion, we no longer
need the stash buffer on the output of decode1.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
At present the busy/stall signal going to decode1 depends on whether
control thinks it can issue the current instruction, and that depends
on completion and bypass signals coming from execute1 and writeback.
To improve the timing of stall_out, this rearranges decode2 so that
stall_out is asserted when we have a valid instruction that couldn't
be issued in the previous cycle. This means that decode1 could give
us a new instruction when we haven't issued the previous instruction.
This in turn means that we can only use d_in in the first cycle of
processing an instruction. After the first cycle, we get register
addresses etc. from dc2 rather than d_in.
Then, to avoid the need to read register operands from register_file
in each cycle until the instruction issues, we bring the bypass path
for data being written to the register file into decode2 explicitly
rather than having it in register_file.
A new process called decode2_addrs does the process of calling
decode_input_reg_* and decode_output_reg and sets up the register file
addresses. This was split out (and decode_input_reg_* reworked) to
try to reduce the number of passes through the decode2_1 process that
need to be done in simulation.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
They are optional in SFFS (scalar fixed-point and floating-point
subset), are not needed for running Linux, and add complexity, so
remove them.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This reduces the set of instructions marked as single-issue to just
attn and mtspr to "slow" SPRs (those that are not stored in the
register file).
The instructions that were previously single-issue are: isync, dcbf,
dcbst, dcbt, dcbtst, eieio, icbi, mfmsr, mtmsr, mtmsrd, mfspr to slow
SPRS, sync, tlbsync and wait. The synchronization instructions are
mostly no-ops anyway due to the in-order nature of the core, and the
cache-management instructions are unimplemented (except for icbi).
The MSR ops don't need to be single-issue due to the in-order core and
the fact that MSR updates are effective on the following instruction.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This makes the FPU able to stall other units at execute stage 2 and be
stalled by other units (specifically the LSU).
This means that the completion and writeback for an instruction can
now end up being deferred until the second cycle of a following
instruction, i.e. the cycle when the state machine has gone through
IDLE state into one of the DO_* states, which means we need to latch
the destination FPR number, CR mask, etc. from the previous
instruction so that we present the correct information to writeback.
The advantage of this is that we can get rid of the in_progress signal
from the LSU.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This lets us forward the CR0 result to following instructions that
use CR, meaning they get to issue one cycle earlier.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
Execute1 and loadstore1 now send each other stall signals that
indicate that a valid instruction in stage 2 can't complete in this
cycle, and hence any valid instruction in stage 1 in the other unit
can't move to stage 2. With this in place, an ALU instruction can
move into stage 1 while a LSU instruction is in stage 2.
Since the FPU doesn't yet have a way to stall completion, we can't yet
start FPU instructions while any LSU or ALU instruction is in
progress.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This enables some instructions to issue earlier and thus improves
performance, at the cost of some extra multiplexers in decode2.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
This adds a second execute stage to the pipeline, in order to match up
the length of the pipeline through loadstore and dcache with the
length through execute1. This will ultimately enable us to get rid of
the 1-cycle bubble that we currently have when issuing ALU
instructions after one or more LSU instructions.
Most ALU instructions execute in the first stage, except for
count-zeroes and popcount instructions (which take two cycles and do
some of their work in the second stage) and mfspr/mtspr to "slow" SPRs
(TB, DEC, PVR, LOGA/LOGD, CFAR). Multiply and divide/mod instructions
take several cycles but the instruction stays in the first stage (ex1)
and ex1.busy is asserted until the operation is complete.
There is currently a bypass from the first stage but not the second
stage. Performance is down somewhat because of that and because this
doesn't yet eliminate the bubble between LSU and ALU instructions.
The forwarding of XER common bits has been changed somewhat because
now there is another pipeline stage between ex1 and the committed
state in cr_file. The simplest thing for now is to record the last
value written and use that, unless there has been a flush, in which
case the committed state (obtained via e_in.xerc) is used.
Note that this fixes what was previously a benign bug in control.vhdl,
where it was possible for control to forget an instructions dependency
on a value from a previous instruction (a GPR or the CR) if this
instruction writes the value and the instruction gets to the point
where it could issue but is blocked by the busy signal from execute1.
In that situation, control may incorrectly not indicate that a bypass
should be used. That didn't matter previously because, for ALU and
FPU instructions, there was only one previous instruction in flight
and once the current instruction could issue, the previous instruction
was completing and the correct value would be obtained from
register_file or cr_file. For loadstore instructions there could be
two being executed, but because there are no bypass paths, failing to
indicate use of a bypass path is fine.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
We now have a record that represents the actions taken in executing an
instruction, and a process that computes that for the incoming
instruction. We no longer have 'current' or 'r.cur_instr', instead
things like the destination register are put into r.e in the first
cycle of an instruction and not reinitialized in subsequent busy
cycles.
For mfspr and mtspr, we now decode "slow" SPR numbers (those SPRs that
are not stored in the register file) to a new "spr_selector" record
in decode1 (excluding those in the loadstore unit). With this, the
result for mfspr is determined in the data path.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
Besides the overflow and status carry bits, XER has 18 bits which need
to retain the value written by mtxer (in case software wants to
emulate the move-assist instructions (lswi, lswx, stswi, stswx).
Until now these bits (and others) have been stored in the GPR file as
a "fast" SPR, but this causes complications because XER is not really
a fast SPR.
Instead, we now store these 18 bits in the 'ctrl' signal, which exists
in execute1. This will enable us to simplify the data path in future,
and has the added bonus that with a little bit of plumbing, we can get
the full XER value printed when dumping registers at the end of a
simulation.
Therefore this changes scripts/run_test.sh to remove the greps which
exclude XER from the comparison of actual and expected register
results.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
Simplify the flow control by stalling the whole upstream pipeline when
a stage can't proceed, instead of trying to let each stage progress
independently when it can.
Signed-off-by: Paul Mackerras <paulus@ozlabs.org>
While these signals should only be read when valid is true, they
are only a small number of bits and we want to reduce the amount of
U/X state bouncing around the chip.
Signed-off-by: Anton Blanchard <anton@linux.ibm.com>
decode1 has a lot of logic that uses i_out.insn without first looking at
i_iout.valid. Play it safe and never output X state.
Signed-off-by: Anton Blanchard <anton@linux.ibm.com>
While we should only look at this when d_out.valid = 1, we may as remove
some U state across interfaces.
Signed-off-by: Anton Blanchard <anton@linux.ibm.com>
Iago Caran Aquino
