fftalgorithms.tex

用于VC.net的gsl的lib库文件包

We can repeat this this procedure for the next most significant bit of
$b$, $b_{n-2}$, using a similar identity,
%
\begin{eqnarray}
W_N^{a(2^{n-2}b_{n-2})} 
&=& \exp(-2\pi i [a_{n-1} \dots a_1 a_0] 2^{n-2} b_{n-2}/ 2^n )\\
&=& W_4^{ [a_1 a_0] b_{n-2}}.
\end{eqnarray}
%
to give a formula with even less dependence on the bits of $a$, 
%
\begin{equation}
h([a_{n-1} \dots a_1 a_0])
= 
\sum_{b_0=0}^{1} 
\sum_{b_1=0}^{1} 
\dots
\sum_{b_{n-3}=0}^{1} 
W_N^{a[b_{n-3} \dots b_1 b_0]}
\sum_{b_{n-2}=0}^{1} 
W_4^{[a_1 a_0] b_{n-2}}
\sum_{b_{n-1}=0}^{1} 
 g(b) 
W_2^{a_0 b_{n-1}}.
\end{equation}
%
If we repeat the process for all the remaining bits we obtain a
simplified DFT formula which is the basis of the radix-2
decimation-in-time algorithm,
%
\begin{eqnarray}
h([a_{n-1} \dots a_1 a_0]) &=& 
\sum_{b_0=0}^{1} 
W_{N}^{[a_{n-1} \dots a_1 a_0]b_0} 
%\sum_{b_1=0}^{1} 
%W_{N/2}^{[a_{n-1} \dots a_1 a_0]b_1} 
\dots
\sum_{b_{n-2}=0}^{1} 
W_4^{ [a_1 a_0] b_{n-2}}
\sum_{b_{n-1}=0}^{1} 
W_2^{a_0 b_{n-1}}
g(b)
\end{eqnarray}
%
To convert the formula to an algorithm we expand out the sum
recursively, evaluating each of the intermediate summations, which we
denote by $g_1$, $g_2$, \dots, $g_n$,
%
\begin{eqnarray}
g_1(a_0,  b_{n-2}, b_{n-3}, \dots, b_1, b_0) 
&=& 
\sum_{b_{n-1}=0}^{1} 
W_2^{a_0 b_{n-1}}
g([b_{n-1}  b_{n-2}  b_{n-3}  \dots  b_1  b_0]) \\
g_2(a_0, {}_{\phantom{-2}} a_{1}, b_{n-3}, \dots, b_1, b_0) 
&=& 
\sum_{b_{n-2}=0}^{1} 
W_4^{[a_1 a_0] b_{n-2}}
g_1(a_0, b_{n-2}, b_{n-3}, \dots, b_1, b_0) \\
g_3(a_0, {}_{\phantom{-2}} a_{1}, {}_{\phantom{-3}} a_{2}, \dots, b_1, b_0) 
&=& 
\sum_{b_{n-3}=0}^{1} 
W_8^{[a_2 a_1 a_0] b_{n-2}}
g_2(a_0, a_1, b_{n-3}, \dots, b_1, b_0) \\
\dots &=& \dots \\
g_n(a_0, a_{1}, a_{2}, \dots, a_{n-2}, a_{n-1}) 
&=&
\sum_{b_{0}=0}^{1} 
W_N^{[a_{n-1} \dots a_1 a_0]b_0}
g_{n-1}(a_0, a_1, a_2, \dots, a_{n-2}, b_0) 
\end{eqnarray}
%
After the final sum, we can obtain the transform $h$ from $g_n$,
%
\begin{equation}
h([a_{n-1} \dots a_1 a_0]) 
= 
g_n(a_0, a_1, \dots, a_{n-1}) 
\end{equation}
% 
Note that we left the storage arrangements of the intermediate sums
unspecified by using the bits as function arguments and not as an
index. The storage of intermediate sums is different for the
decimation-in-time and decimation-in-frequency algorithms.

Before deciding on the best storage scheme we'll show that the results
of each stage, $g_1$, $g_2$, \dots, can be carried out {\em
in-place}. For example, in the case of $g_1$, the inputs are,
%
\begin{equation}
g([\underline{b_{n-1}} b_{n-2} b_{n-3} \dots b_1 b_0])
\end{equation}
%
for $b_{n-1}=(0,1)$, and the corresponding outputs are,
%
\begin{equation}
g_1(\underline{a_0},b_{n-2}, b_{n-3}, \dots, b_1, b_0)
\end{equation}
%
for $a_0=(0,1)$.  It's clear that if we hold $b_{n-2}, b_{n-3}, \dots,
b_1, b_0$ fixed and compute the sum over $b_{n-1}$ in memory for both
values of $a_0 = 0,1$ then we can store the result for $a_0=0$ in the
location which originally had $b_0=0$ and the result for $a_0=1$ in
the location which originally had $b_0=1$. The two inputs and two
outputs are known as {\em dual node pairs}. At each stage of the
calculation the sums for each dual node pair are independent of the
others. It is this property which allows an in-place calculation.

So for an in-place pass our storage has to be arranged so that the two
outputs $g_1(a_0,\dots)$ overwrite the two input terms
$g([b_{n-1},\dots])$. Note that the order of $a$ is reversed from the
natural order of $b$. i.e. the least significant bit of $a$
replaces the most significant bit of $b$. This is inconvenient
because $a$ occurs in its natural order in all the exponentials,
$W^{ab}$. We could keep track of both $a$ and its bit-reverse,
$a^{\mathit bit-reversed}$ at all times but there is a neat trick
which avoids this: if we bit-reverse the order of the input data $g$
before we start the calculation we can also bit-reverse the order of
$a$ when storing intermediate results. Since the storage involving $a$
was originally in bit-reversed order the switch in the input $g$ now
allows us to use normal ordered storage for $a$, the same ordering
that occurs in the exponential factors.

This is complicated to explain, so here is an example of the 4 passes
needed for an $N=16$ decimation-in-time FFT, with the initial data
stored in bit-reversed order,
%
\begin{eqnarray}
g_1([b_0 b_1 b_2 a_0]) 
&=& 
\sum_{b_3=0}^{1} W_2^{a_0 b_3} g([b_0 b_1 b_2 b_3])
\\
g_2([b_0 b_1 a_1 a_0]) 
&=& 
\sum_{b_2=0}^{1} W_4^{[a_1 a_0] b_2} g_1([b_0 b_1 b_2 a_0])
\\
g_3([b_0 a_2 a_1 a_0]) 
&=& 
\sum_{b_1=0}^{1} W_8^{[a_2 a_1 a_0] b_1} g_2([b_0 b_1 a_1 a_0])
\\
h(a) = g_4([a_3 a_2 a_1 a_0]) 
&=& 
\sum_{b_0=0}^{1} W_{16}^{[a_3 a_2 a_1 a_0] b_0} g_3([b_0 a_2 a_1 a_0])
\end{eqnarray}
%
We compensate for the bit reversal of the input data by accessing $g$
with the bit-reversed form of $b$ in the first stage. This ensures
that we are still carrying out the same calculation, using the same
data, and not accessing different values. Only single bits of $b$ ever
occur in the exponential so we never need the bit-reversed form of
$b$.

Let's examine the third pass in detail,
%
\begin{equation}
g_3([b_0 a_2 a_1 a_0]) 
=
\sum_{b_1=0}^{1} W_8^{[a_2 a_1 a_0] b_1} g_2([b_0 b_1 a_1 a_0])
\end{equation}
%
First note that only one bit, $b_1$, varies in each summation.  The
other bits of $b$ ($b_0$) and of $a$ ($a_1 a_0$) are essentially
``spectators'' -- we must loop over all combinations of these bits and
carry out the same basic calculation for each, remembering to update
the exponentials involving $W_8$ appropriately.  If we are storing the
results in-place (with $g_3$ overwriting $g_2$ we will need to compute
the sums involving $b_1=0,1$ and $a_2=0,1$ simultaneously.
%
\begin{equation}
\left(
\begin{array}{c}
g_3([b_0 0 a_1 a_0]) \vphantom{W_8^{[]}} \\
g_3([b_0 1 a_1 a_0]) \vphantom{W_8^{[]}} 
\end{array}
\right)
=
\left(
\begin{array}{c}
g_2([b_0 0 a_1 a_0]) + W_8^{[0 a_1 a_0]} g_2([b_2 1 a_1 a_0]) \\
g_2([b_0 0 a_1 a_0]) + W_8^{[1 a_1 a_0]} g_2([b_2 1 a_1 a_0])
\end{array}
\right)
\end{equation}
%
We can write this in a more symmetric form by simplifying the exponential,
%
\begin{equation}
W_8^{[a_2 a_1 a_0]} 
= W_8^{4 a_2 + [a_1 a_0]} 
= (-1)^{a_2} W_8^{[a_1 a_0]}
\end{equation}
%
\begin{equation}
\left(
\begin{array}{c}
g_3([b_0 0 a_1 a_0]) \vphantom{W_8^{[]}} \\
g_3([b_0 1 a_1 a_0]) \vphantom{W_8^{[]}} 
\end{array}
\right)
=
\left(
\begin{array}{c}
g_2([b_0 0 a_1 a_0]) + W_8^{[a_1 a_0]} g_2([b_2 1 a_1 a_0]) \\
g_2([b_0 0 a_1 a_0]) - W_8^{[a_1 a_0]} g_2([b_2 1 a_1 a_0])
\end{array}
\right)
\end{equation}
%
The exponentials $W_8^{[a_1 a_0]}$ are referred to as {\em twiddle
factors}. The form of this calculation, a symmetrical sum and
difference involving a twiddle factor is called {\em a butterfly}.
It is often shown diagrammatically, and in the case $b_0=a_0=a_1=0$
would be drawn like this,
%
\begin{center}
\setlength{\unitlength}{1cm}
\begin{picture}(9,4)
%
%\put(0,0){\line(1,0){8}}
%\put(0,0){\line(0,1){4}}
%\put(8,4){\line(0,-1){4}}
%\put(8,4){\line(-1,0){8}}
%
\put(0,1){$g_2(4)$} \put(4.5,1){$g_3(4)=g_2(0) - W^a_8 g_2(4)$}
\put(0,3){$g_2(0)$} \put(4.5,3){$g_3(0)=g_2(0) + W^a_8 g_2(4)$}
\put(1,1){\vector(1,0){0.5}}
\put(1.5,1){\line(1,0){0.5}}
\put(1.5,0.5){$W^a_8$}
\put(1,3){\vector(1,0){0.5}}\put(1.5,3){\line(1,0){0.5}}
\put(2,1){\circle*{0.1}}
\put(2,3){\circle*{0.1}}
\put(2,1){\vector(1,1){2}} 
\put(2,1){\vector(1,0){1}} 
\put(3,1){\line(1,0){1}}
\put(3,0.5){$-1$}
\put(2,3){\vector(1,-1){2}} 
\put(2,3){\vector(1,0){1}} 
\put(3,3){\line(1,0){1}}
\put(4,1){\circle*{0.1}}
\put(4,3){\circle*{0.1}}
\end{picture}
\end{center}
%
The inputs are shown on the left and the outputs on the right. The
outputs are computed by multiplying the incoming lines by their
accompanying factors (shown next to the lines) and summing the results
at each node.

In general, denoting the bit for dual-node pairs by $\Delta$ and the
remaining bits of $a$ and $b$ by ${\hat a}$ and ${\hat b}$, the
butterfly is,
%
\begin{equation}
\left(
\begin{array}{c}
g({\hat b} + {\hat a}) \\
g({\hat b} + \Delta + {\hat a}) \\
\end{array}
\right)
\leftarrow
\left(
\begin{array}{c}
g({\hat b} + {\hat a}) + W_{2\Delta}^{\hat a} g({\hat b} + \Delta + {\hat a})\\
g({\hat b} + {\hat a}) - W_{2\Delta}^{\hat a} g({\hat b} + \Delta + {\hat a})
\end{array}
\right)
\end{equation}
%
where ${\hat a}$ runs from $0 \dots \Delta-1$ and ${\hat b}$ runs
through $0 \times 2\Delta$, $1\times 2\Delta$, $\dots$, $(N/\Delta -
1)2\Delta$. The value of $\Delta$ is 1 on the first pass, 2 on the
second pass and $2^{n-1}$ on the $n$-th pass.  Each pass requires
$N/2$ in-place computations, each involving two input locations and
two output locations.

In the example above $\Delta = [100] = 4$, ${\hat a} = [a_1 a_0]$ and
${\hat b} = [b_0 0 0 0]$.

This leads to the canonical radix-2 decimation-in-time FFT algorithm
for $2^n$ data points stored in the array $g(0) \dots g(2^n-1)$.
%
\begin{algorithm}
\STATE bit-reverse ordering of $g$
\STATE {$\Delta \Leftarrow 1$}
\FOR {$\mbox{pass} = 1 \dots n$}
  \STATE {$W \Leftarrow \exp(-2 \pi i / 2\Delta)$}
  \FOR {$(a = 0 ; a < \Delta ; a{++})$}
    \FOR{$(b = 0 ; b < N ; b {+=} 2*\Delta)$}
        \STATE{$t_0 \Leftarrow g(b+a) + W^a g(b+\Delta+a)$}
        \STATE{$t_1 \Leftarrow g(b+a) - W^a g(b+\Delta+a)$}
        \STATE{$g(b+a) \Leftarrow t_0$}
        \STATE{$g(b+\Delta+a) \Leftarrow t_1$}
    \ENDFOR
  \ENDFOR
  \STATE{$\Delta \Leftarrow 2\Delta$}
\ENDFOR
\end{algorithm}
%
%This algorithm appears in Numerical Recipes as the routine {\tt
%four1}, where the implementation is attributed to N.M. Brenner.
%
\subsection{Details of the Implementation}
It is straightforward to implement a simple radix-2 decimation-in-time
routine from the algorithm above. Some optimizations can be made by
pulling the special case of $a=0$ out of the loop over $a$, to avoid
unnecessary multiplications when $W^a=1$,
%
\begin{algorithm}
    \FOR{$(b = 0 ; b < N ; b {+=} 2*\Delta)$}
        \STATE{$t_0 \Leftarrow g(b) + g(b+\Delta)$}
        \STATE{$t_1 \Leftarrow g(b) - g(b+\Delta)$}
        \STATE{$g(b) \Leftarrow t_0$}
        \STATE{$g(b+\Delta) \Leftarrow t_1$}
    \ENDFOR
\end{algorithm}
%
There are several algorithms for doing fast bit-reversal. We use the
Gold-Rader algorithm, which is simple and does not require any working
space,
%
\begin{algorithm}
\FOR{$i = 0 \dots n - 2$}
        \STATE {$ k = n / 2 $}
        \IF {$i < j$}
                \STATE {swap $g(i)$ and $g(j)$}
        \ENDIF

        \WHILE {$k \leq j$}
                \STATE{$j \Leftarrow j - k$} 
                \STATE{$k \Leftarrow k / 2$} 
        \ENDWHILE
      
      \STATE{$j \Leftarrow j + k$}
\ENDFOR
\end{algorithm}
%
The Gold-Rader algorithm is typically twice as fast as a naive
bit-reversal algorithm (where the bit reversal is carried out by
left-shifts and right-shifts on the index).  The library also has a
routine for the Rodriguez bit reversal algorithm, which also does not
require any working space~\cite{rodriguez89}. There are faster bit
reversal algorithms, but they all use additional scratch
space~\cite{rosel89}.

Within the loop for $a$ we can compute $W^a$  using a trigonometric
recursion relation,
%
\begin{eqnarray}
W^{a+1} &=& W W^a \\
        &=& (\cos(2\pi/2\Delta) + i \sin(2\pi/2\Delta)) W^a
\end{eqnarray}
%
This requires only $2 \log_2 N$ trigonometric calls, to compute the
initial values of $\exp(2\pi i /2\Delta)$ for each pass.

\subsection{Radix-2 Decimation-in-Frequency (DIF)}
%
To derive the decimation-in-frequency algorithm we start by separating
out the lowest order bit of the index $a$. Here is an example for the
decimation-in-frequency $N=16$ DFT.
%
\begin{eqnarray}
W_{16}^{[a_3 a_2 a_1 a_0][b_3 b_2 b_1 b_0]} 
&=&
W_{16}^{[a_3 a_2 a_1 a_0][b_2 b_1 b_0]} W_{16}^{[a_3 a_2 a_1 a_0] [b_3
0 0 0]} \\
&=&
W_8^{[a_3 a_2 a_1][b_2 b_1 b_0]} W_{16}^{a_0 [b_2 b_1 b_0]} W_2^{a_0
b_3} \\
&=&
W_8^{[a_3 a_2 a_1][b_2 b_1 b_0]} W_{16}^{a_0 [b_2 b_1 b_0]} (-1)^{a_0 b_3}
\end{eqnarray}
%
By repeating the same type of the expansion on the term,
%
\begin{equation}
W_8^{[a_3 a_2 a_1][b_2 b_1 b_0]}
\end{equation}
%
we can reduce the transform to an alternative simple form,
%
\begin{equation}
h(a) = 
\sum_{b_0=0}^1 (-1)^{a_3 b_0} W_4^{a_2 b_0}
\sum_{b_1=0}^1 (-1)^{a_2 b_1} W_8^{a_1 [b_1 b_0]}
\sum_{b_2=0}^1 (-1)^{a_1 b_2} W_{16}^{a_0 [b_2 b_1 b_0]}
\sum_{b_3=0}^1 (-1)^{a_0 b_3} g(b)
\end{equation}
%
To implement this we can again write the sum recursively. In this case
we do not have the problem of the order of $a$ being bit reversed --
the calculation can be done in-place using the natural ordering of
$a$ and $b$,
%
\begin{eqnarray}