# Linear Feedback Shift Registers for the Uninitiated, Part VIII: Matrix Methods and State Recovery

Last time we looked at a dsPIC implementation of LFSR updates. Now we’re going to go back to basics and look at some matrix methods, which is the third approach to represent LFSRs that I mentioned in Part I. And we’re going to explore the problem of converting from LFSR output to LFSR state.

## Matrices: Beloved Historical Dregs

Elwyn Berlekamp’s 1966 paper *Non-Binary BCH Encoding* covers some work on error-correcting BCH codes, which James Massey recognized had applications to the LFSR, and as a result we have the Berlekamp-Massey algorithm, which we talked about last time. I’ve scanned through Berlekamp’s paper, and it’s just an elegant mess of Greek letters to me. But he does have a section, wryly named Beloved Historical Dregs, that covers a matrix equivalent to polynomial-based analysis (aka generating functions), mentioning the following in passing:

These equations are typically solved by means of a tedious Guass-Jordan [sic] reduction of the above matrix. This method requires many more computations than the generating function approach. The matrix method also requires more storage space. Furthermore, it is less elegant and harder to remember. In view of the iterative algorithm theorems, there is no longer any need to introduce these matrices at all. In short, the matrix method is now obsolete, and not used by those who think young.

Despite this warning, let’s proceed, revisiting our old friend, the LFSR that can be represented by the quotient ring \( H_{25} = GF(2)[x]/(x^5 + x^2 + 1) \):

The polynomial approach we’ve been using in the first six articles in this series, and in the `libgf2`

module that no one else actually uses, is based around the idea of working in quotient rings; successive states of the LFSR can be computed by multiplying by \( x \) at each step and then reducing to find the remainder modulo the characteristic polynomial \( p(x) = x^5 + x^2 + 1 \). Equivalently — and this is the bitwise boolean algebra method — we shift left by one place and if the leftmost bit is 1, we XOR with the bit vector `100101`

that represents the coefficients of the characteristic polynomial.

from IPython.core.display import display, HTML from libgf2.gf2 import GF2QuotientRing def polylatex(coeffbits, reverse=False): coeffs = [] y = coeffbits n = 0 while y != 0: coeffs.append(y & 1) y >>= 1 n += 1 n -= 1 return ('\(' + '+'.join('x^{%d}' % (n-j) if (n-j) > 1 else 'x' if (n-j) == 1 else '1' for j,c in enumerate(coeffs if reverse else coeffs[::-1]) if c != 0) + '\)') def lfsr_table(field, nrows): html = """<div><style type='text/css' scoped='scoped'> </style><table><th>\(x^k\)</th><th>\(x^k \\bmod p(x)\)</th><th>bit vector</th>""" y = field.wrap(1) n = field.degree for k in xrange(nrows): html += ("""<tr><td>\(x^{{{k}}}\)</td><td>{ystr}</td><td><code>{bits:0{n}b}</code></td></tr>""" .format(k=k, ystr=polylatex(y.coeffs), bits=y.coeffs, n=n)) y <<= 1 html += '</table></div>' return HTML(html) lfsr_table(GF2QuotientRing(0x25), 15)

\(x^k\) | \(x^k \bmod p(x)\) | bit vector |
---|---|---|

\(x^{0}\) | \(1\) | `00001` |

\(x^{1}\) | \(x\) | `00010` |

\(x^{2}\) | \(x^{2}\) | `00100` |

\(x^{3}\) | \(x^{3}\) | `01000` |

\(x^{4}\) | \(x^{4}\) | `10000` |

\(x^{5}\) | \(x^{2}+1\) | `00101` |

\(x^{6}\) | \(x^{3}+x\) | `01010` |

\(x^{7}\) | \(x^{4}+x^{2}\) | `10100` |

\(x^{8}\) | \(x^{3}+x^{2}+1\) | `01101` |

\(x^{9}\) | \(x^{4}+x^{3}+x\) | `11010` |

\(x^{10}\) | \(x^{4}+1\) | `10001` |

\(x^{11}\) | \(x^{2}+x+1\) | `00111` |

\(x^{12}\) | \(x^{3}+x^{2}+x\) | `01110` |

\(x^{13}\) | \(x^{4}+x^{3}+x^{2}\) | `11100` |

\(x^{14}\) | \(x^{4}+x^{3}+x^{2}+1\) | `11101` |

Very simple. Now, the third approach for representing the state of the LFSR is to use vectors of bits along with the companion matrix of the characteristic polynomial, and compute in \( GF[2] \), disregarding all this polynomial stuff. The companion matrix of \( p(x) = x^5 + x^2 + 1 \) is

$$C = \begin{bmatrix} 0 & 0 & 0 & 0 & 1 \cr 1 & 0 & 0 & 0 & 0 \cr 0 & 1 & 0 & 0 & 1 \cr 0 & 0 & 1 & 0 & 0 \cr 0 & 0 & 0 & 1 & 0 \cr \end{bmatrix}$$

which is a square matrix of \( n \) rows and columns, where \( n \) is the degree of the characteristic polynomial, and the entries are determined as follows:

- the subdiagonal elements are all ones; these coefficients act to shift a bit vector by one place when left-multiplying by the matrix \( C \)
- the rightmost column contains the coefficients of the characteristic polynomial up to degree \( n-1 \)
- all other entries are zero

The idea is that this matrix \( C \) transforms any bit vector \( S[k] \) representing the state of the LFSR into the state \( S[k+1] \) of the LFSR at the next timestep; in other words, \( S[k+1] = CS[k] \), or if we use the coefficients \( c_j \) of the characteristic polynomial acting on each state bit \( S_j[k] \), then this matrix equation is equivalent to

$$S_j[k+1] = \begin{cases} c_jS_{n-1}[k] & j = 0 \cr c_jS_{n-1}[k] + S_{j-1}[k] & j > 0 \end{cases}$$

In the case of \( H_{25} \) this is

$$\begin{align} S_0[k+1] &= S_4[k] \cr S_1[k+1] &= S_0[k] \cr S_2[k+1] &= S_1[k] + S_4[k] \cr S_3[k+1] &= S_2[k] \cr S_4[k+1] &= S_3[k] \end{align}$$

or, in matrix form:

$$\begin{bmatrix}S_0[k+1] \cr S_1[k+1] \cr S_2[k+1] \cr S_3[k+1] \cr S_4[k+1] \end{bmatrix}= \begin{bmatrix} 0 & 0 & 0 & 0 & 1 \cr 1 & 0 & 0 & 0 & 0 \cr 0 & 1 & 0 & 0 & 1 \cr 0 & 0 & 1 & 0 & 0 \cr 0 & 0 & 0 & 1 & 0 \cr \end{bmatrix} \begin{bmatrix}S_0[k] \cr S_1[k] \cr S_2[k] \cr S_3[k] \cr S_4[k] \end{bmatrix}$$

Here the companion matrix and state vectors are oriented so that the first row and column represent the rightmost shift cell of an LFSR that shifts from right to left, and the last row and column represent the leftmost shift cell.

This approach treats the LFSR state \( S[k] \) as a bit vector representation of the finite field element \( x^k \), where the companion matrix \( C \) can be used to compute the next state \( S[k+1] \). We can also represent the field element \( x^k \) as the matrix \( C^k \), which raises \( C \) to the \( k \)th power (again, with computation in \( GF(2) \), so that all the matrix elements are always 0 or 1); the equivalent bit vector is the contents of the leftmost column:

import numpy as np def matrixlatex(M): latex = '\\begin{bmatrix}' for k,row in enumerate(M): if k > 0: latex += '\\cr ' latex += '&'.join('%d' % c for c in row) latex += '\\end{bmatrix}' return latex def companion_matrix_of_field(field): n = field.degree # Construct companion matrix C = np.zeros((n,n), dtype=np.uint8) k = np.arange(n-1) C[k+1,k] = 1 # subdiagonal C[:,n-1] = [(field.coeffs >> k) & 1 for k in xrange(n)] return C def lfsr_matrix_table(field, nrows): html = """<div><style type='text/css' scoped='scoped'> </style><table><th>\(x^k\)</th><th>\(x^k \\bmod p(x)\)</th><th>bit vector</th><th>matrix representation \(C^k\)</th>""" y = field.wrap(1) n = field.degree C = companion_matrix_of_field(field) Ck = np.eye(n, dtype=np.uint8) for k in xrange(nrows): html += ("""<tr><td>\(x^{{{k}}}\)</td><td>{ystr}</td><td><code>{bits:0{n}b}</code></td><td>{matrix}</td></tr>""" .format(k=k, ystr=polylatex(y.coeffs), bits=y.coeffs, n=n, matrix=matrixlatex(Ck))) y <<= 1 Ck = np.dot(Ck,C) & 1 html += '</table></div>' return HTML(html) H25 = GF2QuotientRing(0x25) lfsr_matrix_table(H25, 15)

\(x^k\) | \(x^k \bmod p(x)\) | bit vector | matrix representation \(C^k\) |
---|---|---|---|

\(x^{0}\) | \(1\) | `00001` | \begin{bmatrix}1&0&0&0&0\cr 0&1&0&0&0\cr 0&0&1&0&0\cr 0&0&0&1&0\cr 0&0&0&0&1\end{bmatrix} |

\(x^{1}\) | \(x\) | `00010` | \begin{bmatrix}0&0&0&0&1\cr 1&0&0&0&0\cr 0&1&0&0&1\cr 0&0&1&0&0\cr 0&0&0&1&0\end{bmatrix} |

\(x^{2}\) | \(x^{2}\) | `00100` | \begin{bmatrix}0&0&0&1&0\cr 0&0&0&0&1\cr 1&0&0&1&0\cr 0&1&0&0&1\cr 0&0&1&0&0\end{bmatrix} |

\(x^{3}\) | \(x^{3}\) | `01000` | \begin{bmatrix}0&0&1&0&0\cr 0&0&0&1&0\cr 0&0&1&0&1\cr 1&0&0&1&0\cr 0&1&0&0&1\end{bmatrix} |

\(x^{4}\) | \(x^{4}\) | `10000` | \begin{bmatrix}0&1&0&0&1\cr 0&0&1&0&0\cr 0&1&0&1&1\cr 0&0&1&0&1\cr 1&0&0&1&0\end{bmatrix} |

\(x^{5}\) | \(x^{2}+1\) | `00101` | \begin{bmatrix}1&0&0&1&0\cr 0&1&0&0&1\cr 1&0&1&1&0\cr 0&1&0&1&1\cr 0&0&1&0&1\end{bmatrix} |

\(x^{6}\) | \(x^{3}+x\) | `01010` | \begin{bmatrix}0&0&1&0&1\cr 1&0&0&1&0\cr 0&1&1&0&0\cr 1&0&1&1&0\cr 0&1&0&1&1\end{bmatrix} |

\(x^{7}\) | \(x^{4}+x^{2}\) | `10100` | \begin{bmatrix}0&1&0&1&1\cr 0&0&1&0&1\cr 1&1&0&0&1\cr 0&1&1&0&0\cr 1&0&1&1&0\end{bmatrix} |

\(x^{8}\) | \(x^{3}+x^{2}+1\) | `01101` | \begin{bmatrix}1&0&1&1&0\cr 0&1&0&1&1\cr 1&0&0&1&1\cr 1&1&0&0&1\cr 0&1&1&0&0\end{bmatrix} |

\(x^{9}\) | \(x^{4}+x^{3}+x\) | `11010` | \begin{bmatrix}0&1&1&0&0\cr 1&0&1&1&0\cr 0&0&1&1&1\cr 1&0&0&1&1\cr 1&1&0&0&1\end{bmatrix} |

\(x^{10}\) | \(x^{4}+1\) | `10001` | \begin{bmatrix}1&1&0&0&1\cr 0&1&1&0&0\cr 0&1&1&1&1\cr 0&0&1&1&1\cr 1&0&0&1&1\end{bmatrix} |

\(x^{11}\) | \(x^{2}+x+1\) | `00111` | \begin{bmatrix}1&0&0&1&1\cr 1&1&0&0&1\cr 1&1&1&1&1\cr 0&1&1&1&1\cr 0&0&1&1&1\end{bmatrix} |

\(x^{12}\) | \(x^{3}+x^{2}+x\) | `01110` | \begin{bmatrix}0&0&1&1&1\cr 1&0&0&1&1\cr 1&1&1&1&0\cr 1&1&1&1&1\cr 0&1&1&1&1\end{bmatrix} |

\(x^{13}\) | \(x^{4}+x^{3}+x^{2}\) | `11100` | \begin{bmatrix}0&1&1&1&1\cr 0&0&1&1&1\cr 1&1&1&0&0\cr 1&1&1&1&0\cr 1&1&1&1&1\end{bmatrix} |

\(x^{14}\) | \(x^{4}+x^{3}+x^{2}+1\) | `11101` | \begin{bmatrix}1&1&1&1&1\cr 0&1&1&1&1\cr 1&1&0&0&0\cr 1&1&1&0&0\cr 1&1&1&1&0\end{bmatrix} |

As I quoted earlier, Berlekamp mentioned the matrix methods are slower and take up more storage space than methods using polynomials. Specifically:

- Since an \( n \times n \) matrix multiply takes \( O(n^3) \) multiplications (or \( \approx O(n^{2.8074}) \) using Strassen multiplication), it’s slower than the polynomial bit vector method, which runs in \( O(n^2) \) operations for large \( n \)
- The storage space requirements are \( O(n^2) \), vs. \( O(n) \) for bit vector polynomials

So why bother? Why don’t we “think young” and use polynomials and finite fields everywhere, instead of messing about with matrices?

## Uses for Matrix Representation in LFSR Analysis

There are still a few reasons to resort to matrix methods.

One is understanding; if you get hung up on the finite field representation, but the matrix method makes sense to you, then by all means please use it.

But the main reason involves the manipulation of LFSR output bitstreams. Working with LFSR state is fairly simple: it can be thought of as the element \( x^k \) in a finite field. But then if we want to describe the LFSR output, it’s not so easy; it involves taking the coefficient of \( x^{n-1} \), which reduces an \( n \)-bit state to a 1-bit output, and how do you do that? The generating function approach is one option; it’s essentially the same thing as z-transforms in digital signal processing, where we represent the infinitely repeating output stream \( y[k] \) as a power series equivalent \( \sum\limits_k y[k]x^k = \frac{1}{p(x)} \), but somehow whenever I try to use this, I get stuck — where do you plug in the state \( S[k] \)? There’s also something called a *trace map* which is part of the whole finite field rigamarole, but it makes my head ache to try to understand it. Whereas with matrix methods, it’s easy; if we have a state vector \( S = \begin{bmatrix}S_0 & S_1 & S_2 & \ldots & S_{n-2} & S_{n-1}\end{bmatrix}^T \) then we just express the output as \( y = W_0 S \) where \( W_0 = \begin{bmatrix}0 & 0 & 0 & \ldots & 0 & 1\end{bmatrix} \) and this pulls out the coefficient of \( x^{n-1} \). We’ll use this method in two applications.

### Time Shifts

Now here’s an interesting proposition: suppose we know the state \( S[k] \) of the LFSR at step \( k \) and we want to know the output \( y[k+d] \) where \( d \) is a fixed offset known ahead of time. There are two ways to compute this.

The finite field approach tells us we can compute \( x^dS \) and take the coefficient of \( x^{n-1} \). For example, in \( H_{25} \) if we start with \( x^5 = x^2 + 1 \) and we know \( d=4 \) then we multiply by \( x^4 \) to get \( x^4(x^2 + 1) = x^6 + x^4 = x^4 + x^3 + x \), and then pull out the coefficient of \( x^4 \) to get 1. Finite field multiplication takes \( O(n^2) \) steps for large \( n \).

The matrix approach lets us do something different. The output advanced by \( d \) steps can be expressed as \( y[k+d] = W_0S[k+d] = W_0C^dS[k] \); if we take the companion matrix \( C \) and raise it to the \( d \)th power and left-multiply by the vector \( W_0 = \begin{bmatrix}0 & 0 & 0 & \ldots & 0 & 1\end{bmatrix} \), then we have a vector \( W_d \) that we can use to extract the output \( y[k+d] \) in only \( O(n) \) steps. It is also worth noting that because of the structure of \( W_0 \), the vector \( W_d = W_0C^d \) is the bottom row of \( C^d \). In the example given above with \( H_{25} \) and \( d=4 \), then the bottom row of \( C^4 \) is \( \begin{bmatrix}1 & 0 & 0 & 1 & 0\end{bmatrix} \), so for any state vector we can just take \( S_0 + S_3 \) to find the output four steps in advance.

Just to double-check here, let’s look at the output stream:

`000010010110011`

Now let’s look at \( S_0 + S_3 \) for each step:

- \( S[0] = \)
`00001`

, \( 1+0 = 1 \) - \( S[1] = \)
`00010`

, \( 0+0 = 0 \) - \( S[2] = \)
`00100`

, \( 0+0 = 0 \) - \( S[3] = \)
`01000`

, \( 0+1 = 1 \) - \( S[4] = \)
`10000`

, \( 0+0 = 0 \) - \( S[5] = \)
`00101`

, \( 1+0 = 1 \) - \( S[6] = \)
`01010`

, \( 0+1 = 1 \) - \( S[7] = \)
`10100`

, \( 0+0 = 0 \) - \( S[8] = \)
`01101`

, \( 1+1 = 0 \) - \( S[9] = \)
`11010`

, \( 0+1 = 1 \) - \( S[10] = \)
`10001`

, \( 1+0 = 1 \) - \( S[11] = \)
`00111`

, \( 1+0 = 1 \) - \( S[12] = \)
`01110`

, \( 0+1 = 1 \) - \( S[13] = \)
`11100`

, \( 0+1 = 1 \) - \( S[14] = \)
`11101`

, \( 1+1 = 0 \)

so the output stream advanced by 4 steps should be

`100101100111110`

Pretty neat, huh? This method works for any value of \( d \), and it is easy to see that no matter what \( d \) is, we can express a shifted version \( y[k+d] \) from the state \( S[k] \) by XORing an appropriate subset of bits of the state \( S[k] \) as designated by the vector \( W_d = W_0C^d \). (Again, \( W_d \) is just the bottom row of the matrix \( C^d \). Essentially we use \( W_d \) as a bitmask for the state \( S[k] \), and then find the parity of the result.)

It turns out that we can actually figure out \( W_d \) as a realizable computation *without using any matrix math*. That’s right, I just told you a while back that matrix methods were useful in some cases, and now I’m saying we can get along without them after all. The astute reader may notice that the coefficients of the \( j \)th column (for any \( j \) numbered \( 0, 1, 2, \ldots n-1 \)) of the matrix \( C^d \) are also the coefficients of \( x^{d+j} \bmod p(x) \). For example, consider \( x^8 = x^3 + x^2 + 1 \pmod {x^5 + x^2 + 1} \), which, expressed in bit vector form is `01101`

, and if we express it as a column vector from least-significant to most-significant bit, is \( \begin{bmatrix}1 & 0 & 1 & 1 & 0\end{bmatrix}^T \), which is column 0 of \( C^8 \), column 1 of \( C^7 \), column 2 of \( C^6 \), column 3 of \( C^5 \), and column 4 of \( C^4 \). Why do we care? Because \( W_d \) is the bottom row of \( C^d \), so if we get the bottom component of each column of \( C^d \) then that gives us \( W_d \).

So here’s an equivalent calculation using finite fields only:

- Precomputation:
- Compute \( x^d \)
- Compute \( W_{d} \) on a component-by-component basis: for \( j = 0, 1, 2, \ldots n-1 \), \( W_{d,j} = \) the bottom component of the \( j \)th column of \( C^d \) which is also the coefficient of \( x^{n-1} \) of \( x^{d+j} \bmod p(x) \).

- Real-time computation:
- The output \( y[k+d] \) can therefore be expressed as a linear combination of the state bits \( S[k] \):

$$y[k+d] = W_dS[k] = \sum\limits_{j=0}^{n-1} W_{d,j}S_j[k]$$

There’s probably some way to express this identity in terms of trace maps or some other aspect of finite fields, but we were able to do some analysis in the matrix representation fairly easily, and then port it back over to the polynomial bit vector representation. In other words, the matrix math was important for us to understand analytically what was going on, but when it came time to compute something tangible, we were able to find a better method using quotient ring elements and bit vectors.

Let’s actually do this computation in Python:

from libgf2.util import parity def time_shifter(field, d): """ Precomputes coefficients to calculate the output of an LFSR d steps ahead of the known state S""" n = field.degree Wd = 0 xdj = field.wrap(1) << d for j in xrange(n): b = (xdj.coeffs >> n-1) # extract the coeff of x^(n-1) from x^(d+j) Wd ^= b << j xdj <<= 1 return Wd

H25 = GF2QuotientRing(0x25) Wd = time_shifter(H25, 4) '{0:05b}'.format(Wd)

'01001'

def gather(state, n): """ Returns the n bits y[k], y[k+1], ... y[k+n-1] given state S[k] """ maskpos = state.field.degree - 1 result = [] for _ in xrange(n): result.append(state.coeffs >> maskpos) state <<= 1 return result def bits_to_text(bits): return ''.join('1' if b else '0' for b in bits) def gather_from_lookahead(state, n, d): """ We're going to return the n bits y[k+d], y[k+d+1], ... y[k+d+n-1] but do this based on the state S[k], S[k+1], S[k+2], ... S[n-1] by using lookahead coefficients Yd as a mask and then computing parity. """ Wd = time_shifter(state.field, d) result = [] for _ in xrange(n): result.append(parity(state.coeffs & Wd)) state <<= 1 return result

for d in xrange(15): print "d=%2d: %s\n %s" % ( d, bits_to_text(gather(H25.wrap(1) << d, 15)), bits_to_text(gather_from_lookahead(H25.wrap(1), 15, d)))

d= 0: 000010010110011 000010010110011 d= 1: 000100101100111 000100101100111 d= 2: 001001011001111 001001011001111 d= 3: 010010110011111 010010110011111 d= 4: 100101100111110 100101100111110 d= 5: 001011001111100 001011001111100 d= 6: 010110011111000 010110011111000 d= 7: 101100111110001 101100111110001 d= 8: 011001111100011 011001111100011 d= 9: 110011111000110 110011111000110 d=10: 100111110001101 100111110001101 d=11: 001111100011011 001111100011011 d=12: 011111000110111 011111000110111 d=13: 111110001101110 111110001101110 d=14: 111100011011101 111100011011101

For each value of \( d \) we computed the output bits \( y[k+d] \) in two ways:

- first, by just computing \( x^{k+d} \) in the finite field and extracting the coefficient of \( x^{n-1} \)
- second, by using the lookahead approach by precomputing \( W_d \) and applying it to the state vector \( S[k] \).

### State Recovery: Going from Output Bits to State

Next we’ll tackle the problem of *state recovery*, namely, suppose we have a known \( n \)-bit LFSR with characteristic polynomial \( p(x) \); we don’t know the LFSR state but we can observe \( n \) consecutive bits of output \( y[k], y[k+1], y[k+2], \ldots, y[k+n-1] \), and we don’t know \( k \). Can we determine the LFSR state \( S[k] \) from this information?

The answer is yes, and the easy brute-force way of getting there involves matrices.

Let’s imagine for a moment that we did know the state \( S[k] \). The output bit \( y[k] = W_0S[k] \). We know from the previous section that the output bit \( y[k+1] = W_1S[k] = W_0CS[k] \), and \( y[k+2] = W_2S[k] = W_0C^2S[k] \), and so on. So we can write an equation for the vector of \( n \) consecutive output bits:

$$ Y[k] = \begin{bmatrix}y[k] \cr y[k+1] \cr y[k+2] \cr \vdots \cr y[k+n-1]\end{bmatrix} = W S[k] $$

where \( W \) is an \( n\times n \) matrix defined by

$$ W = \begin{bmatrix}W_0 \cr W_0C \cr W_0C^2 \cr \vdots \cr W_0C^{n-1}\end{bmatrix}$$

and note again that \( W_0C^d \) is the bottom row of the matrix \( C^d \).

Well, it’s a straightforward matrix problem to solve \( Y[k]=WS[k] \) for \( S \). Conceptually we can think of it as \( S[k] = W^{-1}Y[k] \), although the usual mantra in numerical matrix computation is never actually compute the inverse; the general methods for solving this matrix equation are to factor \( W = LU \) and then use back-substitution to solve \( Y[k] = LV \) for \( V \), then solve from \( US[k]=V \) for \( S[k] \). In the world of continuous-valued matrices we often use the \( QR \) factorization rather than \( LU \) factorization for numerical stability, but here in the world of \( GF(2) \) there’s no numerical accuracy issue, so \( LU \) factoring is fine. That’s the brute-force method, at least (requiring a permutation matrix \( PA=LU \) if necessary). But if we try an example of this, we’ll see there’s an easier way.

Let’s take our field \( H_{25} \) again. The matrix \( W \) is

$$ W = \begin{bmatrix} 0 & 0 & 0 & 0 & 1 \cr 0 & 0 & 0 & 1 & 0 \cr 0 & 0 & 1 & 0 & 0 \cr 0 & 1 & 0 & 0 & 1 \cr 1 & 0 & 0 & 1 & 0 \end{bmatrix} $$

This is interesting because it’s a Hankel matrix with upper part 0, which means we could flip it horizontally to get lower triangular, or vertically to get upper triangular.

Let’s solve instead for \( Y[k]=\bar{W}\bar{S}[k] \) where \( \bar{S}[k] \) is the reflected state vector (coefficient of \( x^{n-1} \) in the top element, rather than the coefficient of \( x^0 \)):

$$ S[k] = \begin{bmatrix}S_{n-1}[k] \cr S_{n-2}[k] \cr S_{n-3}[k] \cr \vdots \cr S_0[k]\end{bmatrix}$$

This flips the W matrix horizontally to become a lower triangular Toeplitz matrix, since its columns act upon the state vector’s rows, so

$$ \bar{W} = \begin{bmatrix} 1 & 0 & 0 & 0 & 0 \cr 0 & 1 & 0 & 0 & 0 \cr 0 & 0 & 1 & 0 & 0 \cr 1 & 0 & 0 & 1 & 0 \cr 0 & 1 & 0 & 0 & 1 \end{bmatrix} $$

and since \( \bar{W} \) is lower triangular, we can just solve \( Y[k] = \bar{W}\bar{S}[k] \) by back-substitution, e.g.:

$$\begin{align} S_{n-1}[k] &= Y[k] \cr S_{n-2}[k] &= Y[k+1] \cr S_{n-3}[k] &= Y[k+2] \cr S_{n-4}[k] &= Y[k+3] + S_{n-1}[k] \cr S_{n-5}[k] &= Y[k+4] + S_{n-2}[k] \end{align}$$

Since the \( \bar{W} \) matrix is a lower triangular Toeplitz matrix, the first column completely determines the remaining content and, the \( j \)th row of the first column is the coefficient of \( x^{n-1} \) of \( x^{n+j-1} \bmod p(x) \).

import scipy.linalg def compute_Wbar(field, first_column_only=False): top_bitpos = (field.degree-1) y = field.wrap(1 << top_bitpos) col0 = [] for _ in xrange(field.degree): col0.append(y.coeffs >> top_bitpos) y <<= 1 if first_column_only: return col0 else: return scipy.linalg.toeplitz(col0, [1]+[0]*top_bitpos) Wbar=compute_Wbar(H25) Wbar

array([[1, 0, 0, 0, 0], [0, 1, 0, 0, 0], [0, 0, 1, 0, 0], [1, 0, 0, 1, 0], [0, 1, 0, 0, 1]])

def state_recovery1(output, field=None, Wbar=None): if Wbar is None: Wbar = compute_Wbar(field) # Now solve Y = Wbar * Sbar for Sbar, where Y is the output bits S = (scipy.linalg.solve_triangular(a=Wbar,b=output,lower=True) % 2).astype(np.int) S = np.flipud(S) return S

And to check whether it works, we can just plug things in:

Ylist = np.array([int(c) for c in '0000100101100111110001']) Ylist

array([0, 0, 0, 0, 1, 0, 0, 1, 0, 1, 1, 0, 0, 1, 1, 1, 1, 1, 0, 0, 0, 1])

e = H25.wrap(1) def state_recovery_test(Ylist, field, solver, **kwargs): n = field.degree for k in xrange(len(Ylist)-n+1): Y = Ylist[k:k+n] S = solver(Y, **kwargs) Sbits = sum(b<<k for k,b in enumerate(S)) print '{0} from state {1} = {2:0{n}b} ({3:0{n}b} expected)'.format( Y,S,Sbits,(e<<k).coeffs, n=n) state_recovery_test(Ylist, e.field, state_recovery1, Wbar=Wbar)

[0 0 0 0 1] from state [1 0 0 0 0] = 00001 (00001 expected) [0 0 0 1 0] from state [0 1 0 0 0] = 00010 (00010 expected) [0 0 1 0 0] from state [0 0 1 0 0] = 00100 (00100 expected) [0 1 0 0 1] from state [0 0 0 1 0] = 01000 (01000 expected) [1 0 0 1 0] from state [0 0 0 0 1] = 10000 (10000 expected) [0 0 1 0 1] from state [1 0 1 0 0] = 00101 (00101 expected) [0 1 0 1 1] from state [0 1 0 1 0] = 01010 (01010 expected) [1 0 1 1 0] from state [0 0 1 0 1] = 10100 (10100 expected) [0 1 1 0 0] from state [1 0 1 1 0] = 01101 (01101 expected) [1 1 0 0 1] from state [0 1 0 1 1] = 11010 (11010 expected) [1 0 0 1 1] from state [1 0 0 0 1] = 10001 (10001 expected) [0 0 1 1 1] from state [1 1 1 0 0] = 00111 (00111 expected) [0 1 1 1 1] from state [0 1 1 1 0] = 01110 (01110 expected) [1 1 1 1 1] from state [0 0 1 1 1] = 11100 (11100 expected) [1 1 1 1 0] from state [1 0 1 1 1] = 11101 (11101 expected) [1 1 1 0 0] from state [1 1 1 1 1] = 11111 (11111 expected) [1 1 0 0 0] from state [1 1 0 1 1] = 11011 (11011 expected) [1 0 0 0 1] from state [1 1 0 0 1] = 10011 (10011 expected)

Tada! The output is on the left, the corresponding LFSR state is on the right.

The only thing that doesn’t sit right with me is the dependency on matrices — yes, it’s time for me to assert again that though the matrix approach does help with understanding, in the end, the matrix computations are unnecessary and we can use bitwise computation or finite fields.

The fact that there’s a rich structure in the \( \bar{W} \) matrix means that we can exploit this and just store its first column, which I’ll call \( w \); the coefficients \( w_j \) are the coefficient of \( x^{n-1} \) in \( x^{n+j-1} \bmod p(x) \).

The way we solve back-substitution in lower triangular matrix is for each row \( j \):

$$\bar{S} _ j[k] = Y[k+j] + \sum\limits_ {i=1}^{j}w _ i\bar{S} _ {j-i}[k]$$

In other words

$$\begin{align} S _ {n-1}[k] = \bar{S} _ 0[k] &= Y[k] \cr S _ {n-2}[k] = \bar{S} _ 1[k] &= Y[k+1] + w_ 1\bar{S} _ 0[k]\cr S _ {n-3}[k] = \bar{S} _ 2[k] &= Y[k+2] + w_ 1\bar{S} _ 1[k] + w_ 2\bar{S} _ 0[k]\cr S _ {n-4}[k] = \bar{S} _ 3[k] &= Y[k+3] + w_ 1\bar{S} _ 2[k] + w_ 2\bar{S} _ 1[k] + w_ 3\bar{S} _ 0[k]\cr &\vdots \cr S _ {0}[k] = \bar{S} _ {n-1}[k] &= Y[k+n-1] + w_ 1\bar{S} _ {n-2}[k] + w_ 2\bar{S} _ {n-3}[k] + \ldots + w _ {n-2}\bar{S} _ 1[k]+ w_ {n-1}\bar{S} _ 0[k] \end{align}$$

Let’s code this in Python!

def state_recovery2(output, field=None, w=None): if w is None: w = compute_Wbar(field, first_column_only=True) n = field.degree else: n = len(w) S = np.zeros(n, dtype=np.int) for j in xrange(n): Sbarj = output[j] for i in xrange(1,j+1): Sbarj ^= w[i]*S[n-1-j+i] S[n-1-j] = Sbarj return S

e = H25.wrap(1) w = compute_Wbar(e.field, first_column_only=True) state_recovery_test(Ylist, e.field, state_recovery2, w=w)

[0 0 0 0 1] from state [1 0 0 0 0] = 00001 (00001 expected) [0 0 0 1 0] from state [0 1 0 0 0] = 00010 (00010 expected) [0 0 1 0 0] from state [0 0 1 0 0] = 00100 (00100 expected) [0 1 0 0 1] from state [0 0 0 1 0] = 01000 (01000 expected) [1 0 0 1 0] from state [0 0 0 0 1] = 10000 (10000 expected) [0 0 1 0 1] from state [1 0 1 0 0] = 00101 (00101 expected) [0 1 0 1 1] from state [0 1 0 1 0] = 01010 (01010 expected) [1 0 1 1 0] from state [0 0 1 0 1] = 10100 (10100 expected) [0 1 1 0 0] from state [1 0 1 1 0] = 01101 (01101 expected) [1 1 0 0 1] from state [0 1 0 1 1] = 11010 (11010 expected) [1 0 0 1 1] from state [1 0 0 0 1] = 10001 (10001 expected) [0 0 1 1 1] from state [1 1 1 0 0] = 00111 (00111 expected) [0 1 1 1 1] from state [0 1 1 1 0] = 01110 (01110 expected) [1 1 1 1 1] from state [0 0 1 1 1] = 11100 (11100 expected) [1 1 1 1 0] from state [1 0 1 1 1] = 11101 (11101 expected) [1 1 1 0 0] from state [1 1 1 1 1] = 11111 (11111 expected) [1 1 0 0 0] from state [1 1 0 1 1] = 11011 (11011 expected) [1 0 0 0 1] from state [1 1 0 0 1] = 10011 (10011 expected)

And that’s great, everything is hunky-dory.

But wait — there’s more! Even though we reduced the \( O(n^2) \) storage requirement, the method shown above still feels kinda matrix-y; we’re using a bunch of linear equations and solving them one by one, and the matrix lurks unseen in the background like some kind of shadow cabal pulling the strings.

It turns out we can solve the state recovery problem in two — count ‘em, *TWO!* — ways just by using our friend the shift register and competely ignoring matrix methods after all. We’ll look at our \( H_{25} \) example (polynomial bit vector = `100101`

) to show how it works.

### State Recovery with LFSR Shifting, Method A

Suppose we have a shift register state \( S[k] \), and we observe the output sequence `11000`

: \( Y[k] = Y[k+1] = 1 \) and \( Y[k+2] = Y[k+3] = Y[k+4] = 0 \). We’re going to maintain a pair of 5-bit values, one representing state content \( S[k] \) and the other representing the validity \( V[k] \) of the bits, where `1`

indicates we know the bit is valid and `0`

means it isn’t.

For example if the state bits are `11101`

and the validity bits are `10110`

(\( V_4 = V_2 = V_1 = 1, V_3 = V_0 = 0 \)) then this means our knowledge of the actual state bits is `1?10?`

where the `?`

character denotes that we don’t know the content of that bit, because the corresponding validity bit was `0`

.

Let’s initialize the state bits \( S[k] \) to all zeros `00000`

and the validity bits to all zeros `00000`

. Now the first output bit \( Y[k] = 1 \), which comes from the most significant bit of state, so that tells us that we can correct the state bits to `10000`

and the validity bits to `10000`

.

Now let’s execute one step of our state update for a normal LFSR representing this field \( H_{25} \), so \( S[k+1] \) can be represented by `00101`

state bits (shift left previous state `10000`

to `100000`

and since the high bit is 1, XOR with the polynomial bit vector `100101`

to knock the number of bits back down to 5) and validity bits `00001`

. Huh? How did we know the validity bits are `00001`

? Well, the top bit validity \( V_4[k+1] = 0 \) because the state bit \( S_4[k+1] \) depends on the next lower bit \( S_3[k] \) on the previous cycle, and the validity of that bit \( V_3[k] = 0 \). Same for the next bits, and the only one we know for certain is the least significant bit, which depends on \( S_4[k] \) and we know that for certain.

The next step is to look at the next output bit \( Y[k+1] = 1 \), so we can correct bit 4 to a `1`

and set the validity bit \( V_4[k+1] = 1 \), so now the state bits \( S[k+1] = \) `10101`

and validity bits \( V[k+1] = \) `10001`

.

Then we execute one step of the LFSR state update again: `10101`

→ `01111`

and the validity bits rotate left to `00011`

.

We keep doing this, alternating between correcting the most significant state bit from the known output bit, and updating the LFSR state, until we process 5 bits and the validity bits are `11111`

, at which point we know \( S[k+5] \) completely and we just execute the state update backwards to get back to \( S[k] \):

step | state bits \(S\) | validity bits \(V\) | state knowledge |
---|---|---|---|

initialization | `00000` | `00000` | `?????` |

output \(Y[k] = 1\) | `10000` | `10000` | `1????` |

state update \(S[k+1] \leftarrow S[k]\) | `00101` | `00001` | `????1` |

output \(Y[k+1] = 1\) | `10101` | `10001` | `1???1` |

state update \(S[k+2] \leftarrow S[k+1]\) | `01111` | `00011` | `???11` |

output \(Y[k+2] = 0\) | `01111` | `10011` | `0??11` |

state update \(S[k+3] \leftarrow S[k+2]\) | `11110` | `00111` | `??110` |

output \(Y[k+3] = 0\) | `01110` | `10111` | `0?110` |

state update \(S[k+4] \leftarrow S[k+3]\) | `11100` | `01111` | `?1100` |

output \(Y[k+4] = 0\) | `01100` | `11111` | `01100` |

*state update \(S[k+5] \leftarrow S[k+4]\) | `11000` | `11111` | `11000` |

*state update \(S[k+5] \rightarrow S[k+4]\) | `01100` | `11111` | `01100` |

state update \(S[k+4] \rightarrow S[k+3]\) | `00110` | `11111` | `00110` |

state update \(S[k+3] \rightarrow S[k+2]\) | `00011` | `11111` | `00011` |

state update \(S[k+2] \rightarrow S[k+1]\) | `10011` | `11111` | `10011` |

state update \(S[k+1] \rightarrow S[k]\) | `11011` | `11111` | `11011` |

Very simple! And since the validity bits always follow this sequence, regardless of the data, we don’t actually have to store them; they’re implied by the algorithm itself, so we just need to keep track of state bits. It also doesn’t matter what state bit pattern we start with; here we show `00000`

to start with, but we could have picked `11111`

or `10101`

; we’d get the same answer.

The two steps marked with a `*`

aren’t necessary since they are inverses of each other, and could be optimized out at the cost of a minor increase in algorithm complexity — though I’d personally just keep the simpler algorithm at the cost of two LFSR updates.

Here is the same algorithm working on some more sample output patterns:

def state_recovery3(field, y): s = field.wrap(0) bitmask = 1 << (field.degree - 1) shiftcount = 0 for b in y: # replace the topmost state bit with the corresponding output bit s += (b*bitmask) ^ (s.coeffs & bitmask) s <<= 1 shiftcount += 1 s >>= shiftcount return s for poly in [0x25, 0x1c3]: field = GF2QuotientRing(poly) n = field.degree print "{0:{n1}}output{0:{n2}}state{0:{n3}}check output from state".format("", n1=(n*3//2 - 3), n2=(n*2 - 4), n3=(n//2 - 1)) for k in xrange(n): for b in [0,1]: pattern = [b]*k + [1-b] + [b]*(n-1-k) s = state_recovery3(field, pattern) y = gather(s, n) print '{0} {1:0{n}b} {2}'.format(y, s.coeffs, pattern, n=n) assert y == pattern

output state check output from state [1, 0, 0, 0, 0] 10010 [1, 0, 0, 0, 0] [0, 1, 1, 1, 1] 01110 [0, 1, 1, 1, 1] [0, 1, 0, 0, 0] 01001 [0, 1, 0, 0, 0] [1, 0, 1, 1, 1] 10101 [1, 0, 1, 1, 1] [0, 0, 1, 0, 0] 00100 [0, 0, 1, 0, 0] [1, 1, 0, 1, 1] 11000 [1, 1, 0, 1, 1] [0, 0, 0, 1, 0] 00010 [0, 0, 0, 1, 0] [1, 1, 1, 0, 1] 11110 [1, 1, 1, 0, 1] [0, 0, 0, 0, 1] 00001 [0, 0, 0, 0, 1] [1, 1, 1, 1, 0] 11101 [1, 1, 1, 1, 0] output state check output from state [1, 0, 0, 0, 0, 0, 0, 0] 11100001 [1, 0, 0, 0, 0, 0, 0, 0] [0, 1, 1, 1, 1, 1, 1, 1] 01011111 [0, 1, 1, 1, 1, 1, 1, 1] [0, 1, 0, 0, 0, 0, 0, 0] 01110000 [0, 1, 0, 0, 0, 0, 0, 0] [1, 0, 1, 1, 1, 1, 1, 1] 11001110 [1, 0, 1, 1, 1, 1, 1, 1] [0, 0, 1, 0, 0, 0, 0, 0] 00111000 [0, 0, 1, 0, 0, 0, 0, 0] [1, 1, 0, 1, 1, 1, 1, 1] 10000110 [1, 1, 0, 1, 1, 1, 1, 1] [0, 0, 0, 1, 0, 0, 0, 0] 00011100 [0, 0, 0, 1, 0, 0, 0, 0] [1, 1, 1, 0, 1, 1, 1, 1] 10100010 [1, 1, 1, 0, 1, 1, 1, 1] [0, 0, 0, 0, 1, 0, 0, 0] 00001110 [0, 0, 0, 0, 1, 0, 0, 0] [1, 1, 1, 1, 0, 1, 1, 1] 10110000 [1, 1, 1, 1, 0, 1, 1, 1] [0, 0, 0, 0, 0, 1, 0, 0] 00000111 [0, 0, 0, 0, 0, 1, 0, 0] [1, 1, 1, 1, 1, 0, 1, 1] 10111001 [1, 1, 1, 1, 1, 0, 1, 1] [0, 0, 0, 0, 0, 0, 1, 0] 00000011 [0, 0, 0, 0, 0, 0, 1, 0] [1, 1, 1, 1, 1, 1, 0, 1] 10111101 [1, 1, 1, 1, 1, 1, 0, 1] [0, 0, 0, 0, 0, 0, 0, 1] 00000001 [0, 0, 0, 0, 0, 0, 0, 1] [1, 1, 1, 1, 1, 1, 1, 0] 10111111 [1, 1, 1, 1, 1, 1, 1, 0]

Tada!

### State Recovery with LFSR Shifting, Method B

This is a very similar approach to method A but going backwards; we start by looking at state \( S[k+5] \) and perform a multiplication by \( x^{-1} \) at each step: shift right, but first, if the least significant bit is 1, XOR the LFSR with the polynomial bit vector of the LFSR characteristic polynomial. This time, at each step, we replace the *least* significant bit with output \( Y[k+j] \) before shifting right; after the shift-right this bit ends up in the *most* significant state bit:

step | state bits \(S\) | validity bits \(V\) | `state knowledge` |
---|---|---|---|

initialization \(S[k+5]\) | `00000` | `00000` | `?????` |

output \(Y[k+4] = 0\) | `00000` | `00001` | `????0` |

state update \(S[k+5] \rightarrow S[k+4]\) | `00000` | `10000` | `0????` |

output \(Y[k+3] = 0\) | `00000` | `10001` | `0???0` |

state update \(S[k+4] \rightarrow S[k+3]\) | `11000` | `11000` | `00???` |

output \(Y[k+2] = 0\) | `00000` | `11001` | `00??0` |

state update \(S[k+3] \rightarrow S[k+2]\) | `00000` | `11100` | `000??` |

output \(Y[k+1] = 1\) | `00001` | `11101` | `000?1` |

state update \(S[k+2] \rightarrow S[k+1]\) | `10010` | `11110` | `1001?` |

output \(Y[k] = 1\) | `10011` | `11111` | `10011` |

state update \(S[k+1] \rightarrow S[k]\) | `11011` | `11111` | `11011` |

We get the same answer and with fewer steps; we don’t have to shift the state \( S[k] \) after updating the LFSR bits will all the input bits. The only downside is that we have to feed in the output bits in reverse order.

def state_recovery4(field, y): s = field.wrap(0) for b in y[::-1]: # replace the least significant state bit with the corresponding output bit s += b ^ (s.coeffs & 1) s >>= 1 return s for poly in [0x25, 0x1c3]: field = GF2QuotientRing(poly) n = field.degree print "{0:{n1}}output{0:{n2}}state{0:{n3}}check output from state".format("", n1=(n*3//2 - 3), n2=(n*2 - 4), n3=(n//2 - 1)) for k in xrange(n): for b in [0,1]: pattern = [b]*k + [1-b] + [b]*(n-1-k) s = state_recovery4(field, pattern) y = gather(s, n) print '{0} {1:0{n}b} {2}'.format(y, s.coeffs, pattern, n=n) assert y == pattern

output state check output from state [1, 0, 0, 0, 0] 10010 [1, 0, 0, 0, 0] [0, 1, 1, 1, 1] 01110 [0, 1, 1, 1, 1] [0, 1, 0, 0, 0] 01001 [0, 1, 0, 0, 0] [1, 0, 1, 1, 1] 10101 [1, 0, 1, 1, 1] [0, 0, 1, 0, 0] 00100 [0, 0, 1, 0, 0] [1, 1, 0, 1, 1] 11000 [1, 1, 0, 1, 1] [0, 0, 0, 1, 0] 00010 [0, 0, 0, 1, 0] [1, 1, 1, 0, 1] 11110 [1, 1, 1, 0, 1] [0, 0, 0, 0, 1] 00001 [0, 0, 0, 0, 1] [1, 1, 1, 1, 0] 11101 [1, 1, 1, 1, 0] output state check output from state [1, 0, 0, 0, 0, 0, 0, 0] 11100001 [1, 0, 0, 0, 0, 0, 0, 0] [0, 1, 1, 1, 1, 1, 1, 1] 01011111 [0, 1, 1, 1, 1, 1, 1, 1] [0, 1, 0, 0, 0, 0, 0, 0] 01110000 [0, 1, 0, 0, 0, 0, 0, 0] [1, 0, 1, 1, 1, 1, 1, 1] 11001110 [1, 0, 1, 1, 1, 1, 1, 1] [0, 0, 1, 0, 0, 0, 0, 0] 00111000 [0, 0, 1, 0, 0, 0, 0, 0] [1, 1, 0, 1, 1, 1, 1, 1] 10000110 [1, 1, 0, 1, 1, 1, 1, 1] [0, 0, 0, 1, 0, 0, 0, 0] 00011100 [0, 0, 0, 1, 0, 0, 0, 0] [1, 1, 1, 0, 1, 1, 1, 1] 10100010 [1, 1, 1, 0, 1, 1, 1, 1] [0, 0, 0, 0, 1, 0, 0, 0] 00001110 [0, 0, 0, 0, 1, 0, 0, 0] [1, 1, 1, 1, 0, 1, 1, 1] 10110000 [1, 1, 1, 1, 0, 1, 1, 1] [0, 0, 0, 0, 0, 1, 0, 0] 00000111 [0, 0, 0, 0, 0, 1, 0, 0] [1, 1, 1, 1, 1, 0, 1, 1] 10111001 [1, 1, 1, 1, 1, 0, 1, 1] [0, 0, 0, 0, 0, 0, 1, 0] 00000011 [0, 0, 0, 0, 0, 0, 1, 0] [1, 1, 1, 1, 1, 1, 0, 1] 10111101 [1, 1, 1, 1, 1, 1, 0, 1] [0, 0, 0, 0, 0, 0, 0, 1] 00000001 [0, 0, 0, 0, 0, 0, 0, 1] [1, 1, 1, 1, 1, 1, 1, 0] 10111111 [1, 1, 1, 1, 1, 1, 1, 0]

## State Recovery in `libgf2`

How does `libgf2`

— the Python module for computation in \( GF(2^n) \) which no one else actually uses — manage state recovery?

State recovery is available in `libgf2.util.state_from_reversed_output`

:

```
def state_from_reversed_output(polycoeffs, rbits):
'''
Compute LFSR state from polynomial coefficients
and a reversed sequence of output bits
polycoeff: polynomial coefficient in bit vector form
rbits: any iterable that represents a reversed sequence of output bits
'''
s = 0
# run backwards until the state has no unknown bits
for bit in rbits:
if bit != 0:
s ^= polycoeffs
s >>= 1
return s
```

The implementation is essentially equivalent to the last method above, `state_recovery4`

(LFSR shifting method B), but instead of working with `GF2Element`

objects we just deal with integers directly

This is slightly optimized when compared with `state_recovery4`

, where we set the least significant bit and then execute a “reverse update” of the LFSR (equivalent to multiplying by \( x^{-1} \)); since the “reverse update” amounts to a correction to XOR with the field’s characteristic polynomial if the least significant bit is 1, and then a shift-right, the least significant bit previously present in the state `s`

is irrelevant, and we can just do this correction step based on each of the output bits.

Here’s an example:

from libgf2.util import state_from_reversed_output y = H25.wrap(1) field = H25 n = field.degree fieldmask = (1 << n) - 1 print "note: output has least significant bit = newest output bit" output = 0 for _ in xrange(20): output = (output << 1) & fieldmask | ((y << (n-1)).coeffs >> (n-1)) # just to double-check that we're not cheating, compare against gather(): output_bits = gather(y, n) assert output == sum(b << (n-1-k) for k,b in enumerate(output_bits)) print 'state {0:05b} -> output {1:05b} -> recovered state {2:05b}'.format( y.coeffs, output, state_from_reversed_output(field.coeffs, output_bits[::-1])) y <<= 1

note: output has least significant bit = newest output bit state 00001 -> output 00001 -> recovered state 00001 state 00010 -> output 00010 -> recovered state 00010 state 00100 -> output 00100 -> recovered state 00100 state 01000 -> output 01001 -> recovered state 01000 state 10000 -> output 10010 -> recovered state 10000 state 00101 -> output 00101 -> recovered state 00101 state 01010 -> output 01011 -> recovered state 01010 state 10100 -> output 10110 -> recovered state 10100 state 01101 -> output 01100 -> recovered state 01101 state 11010 -> output 11001 -> recovered state 11010 state 10001 -> output 10011 -> recovered state 10001 state 00111 -> output 00111 -> recovered state 00111 state 01110 -> output 01111 -> recovered state 01110 state 11100 -> output 11111 -> recovered state 11100 state 11101 -> output 11110 -> recovered state 11101 state 11111 -> output 11100 -> recovered state 11111 state 11011 -> output 11000 -> recovered state 11011 state 10011 -> output 10001 -> recovered state 10011 state 00011 -> output 00011 -> recovered state 00011 state 00110 -> output 00110 -> recovered state 00110

That’s pretty much the end of the story. State recovery is easy and we don’t have to resort to matrices after all.

## Well then, can’t we throw away matrices and rid ourselves of those beloved historical dregs?

Are there any LFSR-related problems that *do* require matrix algebra, and can’t be solved using straightforward bit manipulation or finite fields? I’m not sure. The only one that comes to mind is testing sequences for linear independence: if you have some sequences from outputs of an \( N \)-bit LFSR, which are \( y_1[k], y_2[k], y_3[k], \ldots, y_{m-1}[k] \) and another sequence \( y_m[k] \), can you express \( y_m[k] \) in terms of an XOR of some subset of the other sequences? This is easy with matrices; you construct a matrix of the first N terms of all the sequences:

$$ M_m = \begin{bmatrix} y_1[0] & y_1[1] & y_1[2] & \ldots & y_1[N-1] \cr y_2[0] & y_2[1] & y_2[2] & \ldots & y_2[N-1] \cr y_3[0] & y_3[1] & y_3[2] & \ldots & y_3[N-1] \cr \vdots & \vdots & \vdots & \ddots & \vdots \cr y_m[0] & y_m[1] & y_m[2] & \ldots & y_m[N-1] \cr \end{bmatrix} $$

Then you find the rank of \( M_m \) and compare it with the rank of \( M_{m-1} \) (the same matrix with the last row removed). The rank tells you how many rows are linearly independent, so if the rank of \( M_m \) and \( M_{m-1} \) is the same, then the \( y_m[k] \) sequence doesn’t have any new information and you can express it in terms of the other sequences, using more matrix algebra to figure out which ones to XOR together. If the rank of \( M_m \) is one more than the rank of \( M_{m-1} \), then \( y_m[k] \) can’t be expressed in this way.

Brute force. That’s linear algebra for you.

There’s probably some convoluted way to do the same thing with the algebra of finite fields, but I have no idea how, and even if someone showed me, I don’t think I would like it.

## Wrapup

We discussed matrix representations for an LFSR, in particular how multiplication by the companion matrix \( C \) of the LFSR’s characteristic polynomial is equivalent to multiplication by \( x \) in the corresponding finite field.

We looked at the problem of time shifts (predicting output bit \( Y[k+d] \) from state vector \( S[k] \)) and saw how it can be solved by computing the parity of \( S[k] \) after a bitmask is applied, where the bitmask can be determined from raising the companion matrix \( C \) to the \( d \)th power — or equivalently, looking at the coefficients of \( x^{n-1} \) in the finite field elements \( x^d, x^{d+1}, \ldots, x^{d+n-1} \).

We looked at the problem of state recovery (predicting state vector \( S[k] \) from the output bits \( Y[k], Y[k+1], \ldots, Y[k+n-1] \)) and saw how it can be solved by using powers of the companion matrix \( C^0, C^1, C^2, \ldots, C^{n-1} \) and then a pair of methods based on the solution of a matrix equation; one used a brute-force matrix solver using `scipy.linalg.solve_triangular`

, and the second was a manual solution based on the structure of a Toeplitz matrix. We also looked at two equivalent methods using bit shifting and LFSR updates.

In both cases we were able to find equivalent non-matrix solutions that require less storage space and execution time. This isn’t always the case, but the matrix representation of an LFSR is one instance where the matrices in question have a lot of structure and redundancy. In such instances, matrices may be helpful for understanding and in performing brute-force computations, but there are usually alternatives that execute more quickly.

Next time we’ll be looking at output decimation.

© 2017 Jason M. Sachs, all rights reserved.

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