\section{Designing a verified HLS tool}
\label{sec:design}

This section covers the main architecture of the HLS tool, and the way in which the back end was added to \compcert{}.  This section will also cover an example of converting a simple C program into hardware, expressed in the Verilog language.

\paragraph{Choice of source language}
First of all, the choice of C for the input language of \vericert{} is simply because it is what most major HLS tools use~\cite{canis11_legup, xilinx20_vivad_high_synth, intel_hls, bambu_hls}. This, in turn, may be because C is ``[t]he starting point for the vast majority of algorithms to be implemented in hardware''~\cite{5522874}.
%Since a lot of existing code for HLS is written in C, supporting C as an input language, rather than a custom domain-specific language, means that \vericert{} is more practical. 
%An alternative was to support LLVM IR as an input language, however, to get a full work flow from a higher level language to hardware, a front end for that language to LLVM IR would also have to be verified. \JW{Maybe save LLVM for the `Choice of implementation language'?}
We considered Bluespec~\cite{nikhil04_blues_system_veril}, but decided that although it ``can be classed as a high-level language''~\cite{greaves_note}, it is too hardware-oriented to be used for traditional HLS.
We also considered using a language with built-in parallel constructs that map well to parallel hardware, such as occam~\cite{page91_compil_occam} or Spatial~\cite{spatial}, but found these languages are too niche.
% However, this would not qualify as being HLS due to the manual parallelism that would have to be performed. \JW{I don't think the presence of parallelism stops it being proper HLS.} 
%\JP{I think I agree with Yann here, but it could be worded better. At any rate not many people have experience writing what is essentially syntactic sugar over a process calculus.} 
%\JW{I mean: there are plenty of software languages that involve parallel constructs. Anyway, perhaps we can just dismiss occam for being too obscure.}


\paragraph{Choice of target language}
Verilog~\cite{06_ieee_stand_veril_hardw_descr_languag} is an HDL that can be synthesised into logic cells which can be either placed onto a field-programmable gate array (FPGA) or turned into an application-specific integrated circuit (ASIC).  Verilog was chosen as the output language for \vericert{} because it is one of the most popular HDLs and there already exist a few formal semantics for it that could be used as a target~\cite{loow19_verif_compil_verif_proces, meredith10_veril}. Other possible targets could have been Bluespec, a higher level hardware description language, for which there exists a formally verified translation to circuits using K\^{o}ika~\cite{bourgeat20_essen_blues}, however, targeting this language would not be trivial as it is not meant to be targeted by an automatic tool, instead strives to a formally verified high-level hardware description language instead.  Finally, an intermediate language like LLHD~\cite{schuiki20_llhd} was also considered, however, currently there are no existing formal semantics.

%\JW{Can we mention one or two alternatives that we considered? Bluespec or Chisel or one of Adam Chlipala's languages, perhaps?}

\paragraph{Choice of implementation language}
The framework that was chosen for the frontend was \compcert{}, as it is a mature framework for simulation proofs about intermediate languages, in addition to already providing a validated parser~\cite{jourdan12_valid_lr_parser} from C into the internal representation of Clight.  Other frameworks were also considered, such as Vellvm~\cite{zhao12_formal_llvm_inter_repres_verif_progr_trans}, as LLVM IR in particular is often used by HLS tools anyways, however, these would require more work to support a higher level language such as C as input, or even providing a parser for LLVM IR.\@ \JP{No mention of Coq here.} \JW{Could also mention Kiwi here~\cite{kiwi} as an example of an HLS tool built upon the .NET framework.}

\begin{figure}
  \centering
  \resizebox{0.47\textwidth}{!}{
  \begin{tikzpicture}
    [language/.style={fill=white,rounded corners=3pt,minimum height=7mm},
    continuation/.style={}]
    \fill[compcert,rounded corners=3pt] (-1,-1) rectangle (9,1.5);
    \fill[formalhls,rounded corners=3pt] (-1,-1.5) rectangle (9,-2.5);
    \node[language] at (-0.3,0) (clight) {Clight};
    \node[continuation] at (1,0) (conta) {$\cdots$};
    \node[language] at (2.7,0) (cminor) {CminorSel};
    \node[language] at (4.7,0) (rtl) {3AC};
    \node[language] at (6.2,0) (ltl) {LTL};
    \node[language] at (8.4,0) (ppc) {PPC};
    \node[continuation] at (7.3,0) (contb) {$\cdots$};
    \node[language] at (4.7,-2) (dfgstmd) {HTL};
    \node[language] at (6.7,-2) (verilog) {Verilog};
    \node at (0,1) {\compcert{}};
    \node at (0,-2) {\vericert{}};
    \draw[->] (clight) -- (conta);
    \draw[->] (conta) -- (cminor);
    \draw[->] (cminor) -- (rtl);
    \draw[->] (rtl) -- (ltl);
    \draw[->] (ltl) -- (contb);
    \draw[->] (contb) -- (ppc);
    \draw[->] (rtl) -- (dfgstmd);
    \draw[->] (dfgstmd) -- (verilog);
  \end{tikzpicture}}
  \caption{Verilog back end to Compcert, branching off at the three address code (3AC), at which point the three address code is transformed into a state machine.  Finally, it is transformed to a hardware description of the state machine in Verilog.}%
  \label{fig:rtlbranch}
\end{figure}

\paragraph{Architecture of \vericert{}}
The main work flow of \vericert{} is shown in Figure~\ref{fig:rtlbranch}, which shows the parts of the translation that are performed in \compcert{}, and which have been added with \vericert{}.

\compcert{} is made up of 11 intermediate languages in between the Clight input and the assembly output.  These intermediate languages each serve a different purpose and the translations may contain various optimisations. 
%\JP{Nit: the languages don't contain optimisations, the translation processes do. Maybe we should rephrase this slightly.}  
When designing a new back end for \compcert{}, it is crucial to know where to branch off, so as to benefit from all the useful optimisations that \compcert{} performs, but not performing optimisations that are not useful, which include optimisations that are specific to the target CPU architecture.  These optimisations include register allocation, as there is not a fixed number of registers that need to be targeted.

To choose where to branch off at, each intermediate language in \compcert{} can be evaluated to see if it is suitable to be transformed into hardware.  Existing HLS compilers often use LLVM IR as an intermediate representation when performing HLS-specific optimisations, as each instruction can be mapped quite well to hardware that performs the same behaviour.  Looking at the intermediate languages in \compcert{} shown in Figure~\ref{fig:rtlbranch}, there are many languages to choose from.  Clight and CminorSel are an abstract syntax tree (AST) representation of the C code, which does not correspond to a more assembly like language similar to LLVM IR.\@  In addition to that, looking at the languages from LTL to PPC, even though these languages do contain basic blocks, which are desirable when doing HLS, starting from LTL the number of registers is limited.  Register allocation limits the number of registers when translating 3AC into LTL, and stores variables on the stack if that is required.  This is not needed when performing HLS, as there are many more registers available, and it is preferable to use these instead of RAM whenever possible.

\compcert{}'s three-address code (3AC)\footnote{Three-address code (3AC) is also known as register transfer language (RTL) in the \compcert{} literature, however, 3AC is used in this paper instead so as not to confuse it with register-transfer level (RTL), which is another name for the final hardware target of the HLS tool.} is the intermediate language that resembles LLVM IR the most, as it also has an infinite number of pseudo-registers and each instruction maps well to hardware, even though in the case of 3AC uses the instructions of the target architecture whereas LLVM IR instructions are more abstract.  3AC is represented as a control flow graph (CFG) in CompCert.  Each instruction is a node in the graph and links to the instructions that follow it.  This CFG then describes how the computation should proceed, and is a good representation for performing optimisations on as well as local transformations.  However, one difference between LLVM IR and 3AC is that 3AC uses operations of the target architecture and performs architecture specific optimisations as well, which is not the case in LLVM IR where all the instructions are quite abstract.  This can be mitigated by making \compcert{} target a specific architecture such as x86\_32, where most operations translate quite well into hardware.  In addition to that, many optimisations that are also useful for HLS are performed in 3AC, which means that if it is supported as the input language, the HLS algorithm benefits from the same optimisations.  It is therefore a good candidate to be chosen as the input language to the HLS back end. The complete flow that \vericert{} takes is show in figure~\ref{fig:rtlbranch}.

\begin{figure}
  \centering
  \begin{subfigure}[b]{0.49\linewidth}
\begin{minted}{c}
int main() {
  int x[3] = {1, 2, 3};
  int sum = 0;
  for (int i = 0;
       i < 3;
       i++)
    sum += x[i];
  return sum;
}
\end{minted}
    \caption{Input C code.}\label{fig:accumulator_c}
  \end{subfigure}\hspace*{-4mm}
  \begin{subfigure}[b]{0.49\linewidth}
\begin{minted}[fontsize=\footnotesize]{c}
main() {
 15:  x8 = 1
 14:  int32[stack(0)] = x8
 13:  x7 = 2
 12:  int32[stack(4)] = x7
 11:  x6 = 3
 10:  int32[stack(8)] = x6
  9:  x2 = 0
  8:  x1 = 0
  7:  x5 = stack(0) (int)
  6:  x4 = int32[x5 + x1 * 4 + 0]
  5:  x2 = x2 + x4 + 0 (int)
  4:  x1 = x1 + 1 (int)
  3:  if (x1 <s 3) goto 7 else goto 2
  2:  x3 = x2
  1:  return x3
}
\end{minted}
    \caption{3AC produced by \compcert{}.}\label{fig:accumulator_rtl}
  \end{subfigure}
  \caption{Using \compcert{} to translate a simple program from C to three address code (3AC).}\label{fig:accumulator_c_rtl}
\end{figure}

\subsection{Translating C to Verilog, by example}

Using the simple accumulator program shown in Figure~\ref{fig:accumulator_c} as a worked example, this section describes the main translation that is performed in \vericert{} to go from the behavioural description in C into a hardware design in Verilog.

\subsubsection{Translating C to 3AC}

The first step of the translation is to use \compcert{} to transform the input C code into the 3AC shown in Figure~\ref{fig:accumulator_rtl}. As part of this, \compcert{} performs optimisations such as constant propagation and dead-code elimination.  Function inlining is also performed, which allows us to support function calls without having to support the \texttt{Icall} 3AC instruction.  The duplication of the function bodies caused by inlining does affect the total area of the hardware, however, latency is improved instead.  In addition to that, inlining removes the possibility of supporting recursive function calls, however, this is a feature that isn't supported in most other HLS tools either.

%\JW{Is that definitely true? Was discussing this with Nadesh and George recently, and I ended up not being so sure. Inlining could actually lead to \emph{reduced} resource usage because once everything has been inlined, the (big) scheduling problem could then be solved quite optimally. Certainly inlining is known to increase register pressure, but that's not really an issue here. If we're  not sure, we could just say that inlining everything leads to bloated Verilog files and the inability to support recursion, and leave it at that.}\YH{I think that is true, just because we don't do scheduling.  With scheduling I think that's true, inlining actually becomes quite good.}

\subsubsection{Translating 3AC to HTL}

%   + TODO Explain the main mapping in a short simple way

%   + TODO Clarify connection between CFG and FSMD

%   + TODO Explain how memory is mapped
%\JW{I feel like this could use some sort of citation, but I'm not sure what. I guess this is all from "Hardware Design 101", right?}\YH{I think I found a good one actually, which goes over the basics.}
%\JW{I think it would be worth having a sentence to explain how the C model of memory is translated to a hardware-centric model of memory. For instance, in C we have global variables/arrays, stack-allocated variables/arrays, and heap-allocated variables/arrays (anything else?). In Verilog we have registers and RAM blocks. So what's the correspondence between the two worlds? Globals and heap-allocated are not handled, stack-allocated variables become registers, and stack-allocated arrays become RAM blocks? Am I close?}\YH{Stack allocated variables become RAM as well, so that we can deal with addresses easily and take addresses of any variable.} \JW{I see, thanks. So, in short, the only registers in your hardware designs are those that store things like the current state, etc. You generate a fixed number of registers every time you synthesis -- you don't generate extra registers to store any of the program variables. Right?}

The first translation performed in \vericert{} is from 3AC to a new hardware translation language (HTL), which is one step towards being completely translated to hardware described in Verilog.  The main translation that is performed is going from a CFG representation of the computation to a finite state machine with datapath (FSMD)~\cite{hwang99_fsmd} representation in HTL.\@  The core idea of the FSMD representation is that it separates the control flow from the operations on the memory and registers, so that the state transitions can be translated into a simple finite state machine (FSM) and each state then contains data operations that update the memory and registers.  Figure~\ref{fig:accumulator_diagram} shows the resulting architecture of the FSMD.  Hardware does not have the same memory model as C, the memory model therefore needs to be translated in the following way.  Global variables are not translated in \vericert{} at the moment, however, the stack of the main function will become the RAM seen in Figure~\ref{fig:accumulator_diagram}.  Variables that have their address is taken will therefore be stored in the RAM, as well as any arrays or structs defined in the function.  Variables that did not have their address taken will be kept in registers.

\begin{figure*}
  \centering
  \includegraphics[scale=0.3,trim={10cm 8cm 5cm 5cm},clip=true]{data/accumulator_fsmd2.pdf}
  \caption{The FSMD for our running example. \JW{Maybe replace `State' with `Current State'? And maybe `Calculate State' could be clearer as `Calculate Next State'?} \JW{Can state 15 (or should it be state 16??) have a dangling incoming arrow to indicate that it is the start state? And perhaps state 1 could have a double outline to indicate that it is an `accepting' state? Since there's space above the `Calculate State' box, I'd be mildly in favour of expanding that box a bit so that it included all 15 states explicitly (snaking back and forth).}\YH{If this is better I can mock up a tikz version of it maybe and fix the last bits then too.}}\label{fig:accumulator_diagram}
\end{figure*}

The translation from 3AC to HTL is straightforward, as each 3AC instruction either matches up quite well to a hardware construct, or does not have to be handled by the translation, such as function calls.
%At each instruction, the control flow is separated from the data computation and is then added to the control logic and data-flow map respectively.
%\JW{I suspect that you could safely chop that sentence.}
For example, in state 16 in figure~\ref{fig:accumulator_rtl}, the register \texttt{x9} is initialised to 1, after which the control flow moves to state 15.  This is encoded in HTL by initialising a 32-bit register \texttt{reg\_9} to 1 in the data-flow section, and also adding a transition to the state 15 in the control logic section.  Simple operator instructions are translated in a similar way.  For example, in state 5, the value in the array is added to the current value of the accumulated sum, which is simply translated to an addition of the equivalent registers in the HTL code.

\paragraph{Key challenge: signedness} Note that the comparison in state 3 is signed.  By default, all operators and registers in Verilog and HTL are unsigned, so to force an operation to handle the bits as signed, both operators have to be forced to signed.  In addition to that, Verilog resizes expressions to the largest needed size by default, which can affect the result of the computation.  This feature is also not supported by the Verilog semantics we used, and there would therefore be a mismatch between the Verilog semantics and the actual behaviour of Verilog according to the standard.  To bypass this issue braces are used to stop the Verilog simulator or synthesis tool from resizing anything inside the braces.  Instead, explicit resizing is used in the semantics and operations can only be performed on two registers that have the same size.

\subsection{Translating HTL to Verilog}

Finally, we have to translate the HTL code into proper Verilog and prove that it behaves the same as the 3AC according to the Verilog semantics.  Whereas HTL is a language that is specifically designed to represent the FSMDs we are interested in, Verilog is a general-purpose HDL.\@  So the challenge here is to translate our FSMD representation into a Verilog AST.  However, as all the instructions are already expressed in Verilog, only the maps need to be translated to valid Verilog, and correct declarations for all the variables in the program need to be added as well.

This translation seems quite straightforward, however, proving that it is correct is not that simple, as all the implicit assumptions that were made in HTL need to be translated explicitly to Verilog statements and needs it needs to be shown that these explicit behaviours are equivalent to the assumptions made in the HTL semantics.
Figure~\ref{fig:accumulator_v} shows the final Verilog output that is generated.  In general, the structure is similar to that of the HTL code, however, the control and datapath maps have been translated to case statements.  The other main addition to the code is the initialisation of all the variables in the code to the correct bitwidths and the declaration of the inputs and outputs to the module, so that the module can be used inside a larger hardware design.

\begin{figure}
  \centering
  \begin{subfigure}[b]{0.49\linewidth}
\begin{minted}[fontsize=\tiny]{verilog}
module main(reset, clk, finish, return_val);
  reg [31:0] stack [2:0];
  input [0:0] clk, reset;
  output reg [31:0] return_val;
  output reg [0:0] finish;
  reg [31:0] reg_8, reg_4, state,
             reg_6, reg_1, reg_9,
             reg_5, reg_3, reg_7;
  always @(posedge clk)
    case (state)
      32'd15: reg_9 <= 32'd1;
      32'd14: stack[32'd0] <= reg_9;
      32'd13: reg_8 <= 32'd2;
      32'd12: stack[32'd1] <= reg_8;
      32'd11: reg_7 <= 32'd3;
      32'd10: stack[32'd2] <= reg_7;
      32'd9: reg_3 <= 32'd0;
      32'd8: reg_1 <= 32'd0;
      32'd7: reg_6 <= 32'd0;
      32'd6: reg_5 <= stack[{{{reg_6 + 32'd0}
        + {reg_1 * 32'd4}} / 32'd4}];
      32'd5: reg_3 <= {reg_3 + {reg_5 + 32'd0}};
      32'd4: reg_1 <= {reg_1 + 32'd1};
      32'd3: ;
      32'd2: reg_4 <= reg_3;
      32'd1: begin
        finish = 1'd1;
        return_val = reg_4;
      end
      default:;
    endcase
\end{minted}
    \caption{Verilog always block describing the datapath of the module.}\label{fig:accumulator_v_1}
  \end{subfigure}\hfill%
  \begin{subfigure}[b]{0.49\linewidth}
\begin{minted}[fontsize=\tiny]{verilog}
  always @(posedge clk)
    if ({reset == 1'd1})
      state <= 32'd16;
    else
      case (state)
        32'd15: state <= 32'd14;
        32'd14: state <= 32'd13;
        32'd13: state <= 32'd12;
        32'd12: state <= 32'd11;
        32'd11: state <= 32'd10;
        32'd10: state <= 32'd9;
        32'd9: state <= 32'd8;
        32'd8: state <= 32'd7;
        32'd7: state <= 32'd6;
        32'd6: state <= 32'd5;
        32'd5: state <= 32'd4;
        32'd4: state <= 32'd3;
        32'd3: state <=
          ({$signed(reg_1) < $signed(32'd3)}
             ? 32'd7 : 32'd2);
        32'd2: state <= 32'd1;
        32'd1: ;
        default:;
      endcase
endmodule
\end{minted}
    \caption{Verilog always block describing the control logic of the module.}\label{fig:accumulator_v_2}
  \end{subfigure}
  \caption{Accumulator example using \vericert{} to translate the 3AC to a state machine expressed in Verilog. \JW{If space permits, it would probably be preferable to have this code in a single column, as splitting a single module across two subfigures is a bit jarring.}\YH{I actually don't mind it for some reason, because it separates control flow and data path, but it's true it is weird.  The only problem is it's very long if I don't do that.}}\label{fig:accumulator_v}
\end{figure}

\subsection{Optimisations}

Although \vericert{} is not yet a proper `optimising' HLS compiler, we have implemented a few optimisations that aim to improve the quality of the hardware designs it produces.

\subsubsection{Byte- and word-addressable memories}

One big difference between C and Verilog is how memory is represented.  In hardware, efficient RAMs are not as available as in software, and need to be explicitly implemented by declaring two-dimensional arrays with specific properties.  A major limitation is that RAMs often only allow one read and one write per clock cycle.  To make loads and stores as efficient as possible, the RAM needs to be word-addressable, so that an entire integer can be loaded or stored in one clock cycle.
However, the memory model that \compcert{} uses for its intermediate languages~\cite{blazy05_formal_verif_memor_model_c} is byte-addressable.  It therefore has to be proven that the byte-addressable memory behaves in the same way as the word-addressable memory in hardware.  Any modifications of the bytes in the \compcert{} memory model also have to be shown to modify the word-addressable memory in the same way.  As only integer loads and stores are currently supported in our HLS back end, it follows that the addresses given to the loads and stores should be divisible by four.  If that is the case, then the translation from byte-addressed memory to word-addressed memory could be done by dividing the address by four.

\subsubsection{Implementing the \texttt{Oshrximm} instruction}

% Mention that this optimisation is not performed sometimes (clang -03).

\vericert{} performs some optimisations at the level of the instructions that are generated, so that the hardware performs the instructions as quickly as possible and so that the maximum frequency at which the hardware can run is increased.  One of the main constructs that cripple performance of the generated hardware is the instantiation of divider circuits in the hardware.  In the case of \vericert{}, it requires the result of the divide operation to be ready in the same clock cycle, meaning the divide circuit needs to be implemented fully combinationally.  This is inefficient in terms of hardware size, but also in terms of latency, because it means that the maximum frequency of the hardware needs to be reduced dramatically so that the divide circuit has enough time to finish.

%\JP{Multi-cycle paths might be something worth exploring in future work: fairly error-prone/dangerous for hand-written code, but might be interesting in generated code.}\YH{Definitely is on the list for next things to look into, will make divide so much more efficient.}

These small optimisations were found to be the most error prone, and guaranteeing that the new representation is equivalent to representation used in the \compcert{} semantics is difficult without proving this for all possible inputs.

Dividing by a constant can often be optimised to a more efficient operation, especially if the denominator is a factor of two.  In \compcert{}, the \texttt{Oshrximm} is a strength-reduced version of a signed divide operation, performing the following operation, which is transformed to our optimal representation on the right, where $\div$ stands for integer signed division and $>>$ stands for a logical right shift:

\begin{align*}
  &\forall x, y \in \mathbb{Z},\ \ 0 \leq y < 31,\ \ -2^{31} \leq x < 2^{31},\\
  &x \div 2^y =
  \begin{cases}
    \left\lfloor \frac{x}{2^y} \right\rfloor = x >> y,& \text{if } x \geq 0\\
    \left\lceil \frac{x}{2^y} \right\rceil = - \left\lfloor \frac{-x}{2^y} \right\rfloor = - ( - x >> y ),& \text{otherwise}.
  \end{cases}\\
\end{align*}

The \compcert{} semantics for the \texttt{Oshrximm} instruction express it's operation exactly as shown in the equation above, even though in hardware the computation that would be performed would be different.  In \vericert{}, if the same operation would be implemented using Verilog operators, it is not guaranteed to be optimised correctly by the synthesis tools that convert the Verilog into a circuit.  To guarantee an output that does not include divides, we therefore have to express it in Verilog using shifts, and then prove that this representation is equivalent to the divide representation used in the \compcert{} semantics.  This proof discovered quite a few bugs in our initial implementation of optimisations, which rounded to $-\infty$ instead of 0.

%\JW{I wonder if Section 2 could benefit from a `Some Key Challenges' subsection, where you highlight several interesting bits of the translation process, each with their own paragraph heading. These could be something like:\begin{enumerate}\item Discrepancy between C and Verilog w.r.t. signedness \item Deciding between byte- and word-addressable memories \item Adding reset signals \item Implementing the Oshrximm instruction correctly \end{enumerate} For the causal reader, this would immediately signal two things: (1) you can skip this subsection on your initial pass, and (2) proving the HLS tool correct was a non-trivial undertaking.}

% - Explain main differences between translating C to software and to hardware.

%   + This can be done by going through the simple example.


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