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Great Internet Mersenne Prime Search

GIMPS

Finding World Record Primes Since 1996

GIMPS

Finding World Record Primes Since 1996

Last updated: September 1, 2009

This page discusses some of the math behind and the computer algorithms used in an efficient search for Mersenne primes. As I am more a computer programmer than a mathematician, I will not go into too much mathematical detail but will try to provide pointers instead.

- Forming an Exponent List
- Trial Factoring
- P-1 Factoring
- Lucas-Lehmer Primality Testing
- Double-Checking

Mersenne numbers are of the simple form 2^{P}-1, where P is the exponent to be tested. It is easy to prove
that if 2^{P}-1 is prime, then P must be a prime. Thus, the first step in the search is to create a list of prime exponents to test.

The next step is to eliminate exponents by finding a small factor. There are very efficient algorithms for determining if a number divides 2^{P}-1. For example, let's see
if 47 divides 2^{23}-1. Convert the exponent 23 to binary, you get 10111. Starting with 1, repeatedly square, remove the top bit of the exponent and if 1 multiply squared
value by 2, then compute the remainder upon division by 47.

Square top bit mul by 2 mod 47
------------ ------- ------------- ------
1*1 = 1 1 0111 1*2 = 2 2
2*2 = 4 0 111 no 4
4*4 = 16 1 11 16*2 = 32 32
32*32 = 1024 1 1 1024*2 = 2048 27
27*27 = 729 1 729*2 = 1458 1

Thus, 2^{23} = 1 mod 47. Subtract 1 from both sides. 2^{23}-1 = 0 mod 47. Since we've shown that 47 is a factor, 2^{23}-1 is not prime.

One very nice property of Mersenne numbers is that any factor q of 2^{p}-1 must be of the form 2kp+1. Furthermore, q must be 1 or 7 mod 8. A proof
is available. Finally, an efficient program can take advantage of the fact that any potential factor q must be prime.

The GIMPS factoring code creates a modified sieve of Eratosthenes with each bit representing a potential 2kp+1 factor. The sieve then eliminates any potential factors that are divisible by prime numbers below 40,000 or so. Also, bits representing potential factors of 3 or 5 mod 8 are cleared. This process eliminates roughly 95% of potential factors. The remaining potential factors are tested using the powering algorithm above.

Now the only question remaining is how much trial factoring should be done? The answer depends on three variables: the cost of factoring, the chance of finding a factor, and the cost of a primality test. The formula used is:

factoring_cost < chance_of_finding_factor * 2 * primality_test_cost

That is, the time spent factoring must be less than the expected time saved. If a factor is found we can avoid running both the first-time and double-check primality tests. Looking at past
factoring data we see that the chance of finding a factor between 2^{X} and 2^{X+1} is about 1/x. The factoring cost and primality test costs are computed by timing the
program. At present, the program trial factors to these limits:

Exponents up to | Trial factor to |
---|---|

0 | 2^{65} |

23,390,000 | 2^{66} |

29,690,000 | 2^{67} |

37,800,000 | 2^{68} |

47,450,000 | 2^{69} |

58,520,000 | 2^{70} |

75,670,000 | 2^{71} |

96,830,000 | 2^{72} |

115,300,000 | 2^{73} |

147,500,000 | 2^{74} |

186,400,000 | 2^{75} |

227,300,000 | 2^{76} |

264,600,000 | 2^{77} |

337,400,000 | 2^{78} |

420,400,000 | 2^{79} |

516,000,000 | 2^{80} |

There is another factoring method that GIMPS uses to find factors and thereby avoid costly primality tests. This method is called Pollard's (P-1) method. If q is a factor of a number, then the P-1 method will find the factor q if q-1 is highly composite – that is, it has nothing but small factors.

This method when adapted to Mersenne numbers is even more effective. Remember, that the factor q is of the form 2kp+1. It is easy to modify the P-1 method such that it will find the factor q whenever k is highly composite.

The P-1 method is quite simple. In stage 1 we pick a bound B1. P-1 factoring will find the factor q as long as all factors of k are less than B1 (k is called B1-smooth). We compute E –
the product of all primes less than B1. Then we compute x = 3^{E*2*P}. Finally, we check the GCD (x-1, 2^{P}-1) to see if a factor was found.

There is an enhancement to Pollard's algorithm called stage 2 that uses a second bound, B2. Stage 2 will find the factor q if k has just one factor between B1 and B2 and all remaining factors are below B1. This stage uses lots of memory.

GIMPS has used this method to find some impressive factors. For example:

2^{17504141}-1 is divisible by 426315489966437174530195419710289226952407399.
426315489966437174530195419710289226952407399 expressed as 2kp+1 is
2 × 12177561011603973440633145599955154239 × 17504141 + 1
The value k, 12177561011603973440633145599955154239, is very smooth (has many small factors):
12177561011603973440633145599955154239 = 3 × 191 × 307 × 593 × 839 × 3593 × 3989 × 4051 × 6691 × 152429 × 2349679

So how does GIMPS intelligently choose B1 and B2? We use a variation of the formula used in trial factoring. We must maximize:

chance_of_finding_factor * 2 * primality_test_cost - factoring_cost

The chance of finding a factor and the factoring cost both vary with different B1 and B2 values. Dickman's function (see Knuth's Art of Computer Programming Vol. 2) is used to determine the probability of finding a factor, that is k is B1-smooth or B1-smooth with just one factor between B1 and B2. The program tries many values of B1 and (if there is sufficient available memory) several values of B2, selecting the B1 and B2 values that maximize the formula above.

The methods described above are first used to attempt to find a factor for the Mersenne number and therefore eliminate the prime exponent P from the testing list before performing the relatively costly Lucas-Lehmer primality test.

The Lucas-Lehmer primality test is remarkably simple. It states that for P > 2, 2^{P}-1 is prime if and only if S_{p-2}
is zero in this sequence: S_{0} = 4, S_{N} = (S_{N-1}^{2} - 2) mod (2^{P}-1).

For example, to prove 2^{7} - 1 is prime:

S_{0} = 4
S_{1} = (4 * 4 - 2) mod 127 = 14
S_{2} = (14 * 14 - 2) mod 127 = 67
S_{3} = (67 * 67 - 2) mod 127 = 42
S_{4} = (42 * 42 - 2) mod 127 = 111
S_{5} = (111 * 111 - 2) mod 127 = 0

To implement the Lucas-Lehmer test efficiently, one must find the fastest way to square huge numbers modulo 2^{P}-1. Since the late 1960's the fastest algorithm for squaring large
numbers is to split the large number into pieces forming a large array, then perform a Fast Fourier Transform (FFT), a squaring, and an Inverse Fast Fourier Transform (IFFT). See the "How
Fast Can We Multiply?" section in Knuth's Art of Computer Programming Vol. 2. In a January, 1994 Mathematics of Computation article by Richard Crandall
and Barry Fagin titled "*Discrete Weighted Transforms and Large-Integer Arithmetic*", the concept of using an irrational base FFT was
introduced. This improvement more than doubled the speed of the squaring by allowing us to use a smaller FFT and it performs the mod 2^{P}-1 step for free. Although GIMPS uses a
floating point FFT for reasons specific to the Intel Pentium architecture, Peter Montgomery showed that an all-integer weighted transform
can also be used.

As mentioned in the last paragraph, GIMPS uses floating point FFTs written in highly pipelined, cache friendly assembly language. Since floating point computations are inexact, after every iteration the floating point values are rounded back to integers. The discrepancy between the proper integer result and the actual floating point result is called the convolution error. If the convolution error ever exceeds 0.5 then the rounding step will produce incorrect results – meaning a larger FFT should have been used. One of GIMPS' error checks is to make sure the maximum convolution error does not exceed 0.4. Unfortunately, this error check is fairly expensive and is not done on every squaring. There is another error check that is fairly cheap. One property of FFT squaring is that:

(sum of the input FFT values)^{2} = (sum of the output IFFT values)

Since we are using floating point numbers we must change the "equals sign" above to "approximately equals". If the two values differ by a substantial amount, then you get a SUMINP != SUMOUT error as described in the readme.txt file. If the sum of the input FFT values is an illegal floating point value such as infinity, then you get an ILLEGAL SUMOUT error. Unfortunately, these error checks cannot catch all errors, which brings us to our next section.

What are the chances that the Lucas-Lehmer test will find a new Mersenne prime number? A simple approach is to repeatedly apply the observation that the chance of finding a factor between
2^{X} and 2^{X+1} is about 1/x. For example, you are testing 2^{10,000,139}-1 for which trial factoring has proved there are no factors less than 2^{64}.
The chance that it is prime is the chance of no 65-bit factor * chance of no 66-bit factor * ... * chance of no 5,000,070-bit factor. That is:

64 65 5000069
-- * -- * ... * -------
65 66 5000070

This simplifies to 64 / 5000070 or 1 in 78126. This simple approach isn't quite right. It would give a formula of how_far_factored divided by (exponent divided by 2). However, more rigorous work has shown the formula to be (how_far_factored-1) / (exponent times Euler's constant (0.577...)). In this case, 1 in 91623. Even these more rigourous formulas are unproven.

To verify that a first-time Lucas-Lehmer primality test was performed without error, GIMPS runs the primality test a second time. During each Lucas-Lehmer primality test, the low order 64 bits
of the final S_{P-2} value, called a residue, are sent to PrimeNet and recorded. If these match, then GIMPS declares the exponent properly double-checked. If they do not match, then the
primality test is run again until a match finally occurs. The double-check, which takes just as long as a first-time test, is usually done about 2 years after the first-time test. GIMPS assigns
double-checks to slower PCs because the exponents are smaller than first-time tests, resulting in work units that can complete in a reasonable time on a slower PC.

GIMPS double-checking goes a bit further to guard against programming errors. Prior to starting the Lucas-Lehmer test, the S_{0} value is left-shifted by a random amount. Each squaring
just doubles how much we have shifted the S value. Note that the mod 2^{P}-1 step merely rotates the p-th bits and above to the least significant bits, so there is no loss of information.
Why do we go to this trouble? If there were a bug in the FFT code, then the shifting of the S values ensures that the FFTs in the first primality test are dealing with completely different data
than the FFTs in the second primality test. It would be near impossible for a programming bug to produce the same final 64 bit residues.

Historically, the error rate for a Lucas-Lehmer test where no serious errors were reported during the run is around 1.5%. For Lucas-Lehmer tests where an error was reported the error rate is in the neighborhood of 50%. For the record, I don't count the "ILLEGAL SUMOUT" error as a serious error.

©1996-2014 Mersenne Research, Inc.

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