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Consider a square matrix A of order n with coefficients in
.
It is known that det(A), the determinant of A, can be computed
in at most 2n^{3} operations in
by means of Gaussian elimination.
Let us estimate the growth of the coefficients.
For simplicity, assume
 A is not singular,
 no row or column permutations are necessary,
After k  1 pivoting stages the current matrxi A^{(k)} looks like
The entries of the matrix for
k < i n and
k j n
change according to the formula
a_{ij}^{(k+1)} = a_{ij}^{(k)}  a_{kj}^{(k)}. 
(78) 
We consider the following numbers.
 Let b_{k} be an upper bound for the absolute value of the numerators
and the denominators of all
a_{ij}^{(k)}.
 In particular for
1 i, j n we have
 a_{ij}  b_{0}.
From Relation (78) we obtain
b_{k} 2b_{k1}^{4} 4b_{k2}^{42} ^{ ... } 2^{k}b_{0}^{4k} 
(79) 
This shows an exponential upper bound.
(However a polynomial bound in b_{0}, n can be established
but the proof is far from trivial and the formula still not very encouraging.)
In what follows, we present an approach whose goal is control
the growth of the intermediate computations when calculating the determinant of A.
Let d be this determinant.
Let us choose a prime number
p such that
Let r be the determinant of A regarded as a matrix over
/p
and let us choose for representing
/p the integers in the symmetric range
 ^{ ... } 
(81) 
Hence we have
leading to
Observe that det(A) is a polynomial in the coefficients of A.
For instance with n = 2 we have
det(A) = a_{11} a_{22}  a_{12} a_{21} 
(84) 
which shows that det(A) (for n = 2) is a polynomial in
a_{11}, a_{22}, a_{12}, a_{21}.
Observe also the map
h : 
(85) 
is a ring homomorphism. In other words for every
x, y we have
Hence for n = 2 we have
More generally we have
= det(A mod p) 
(88) 
that is
d r mod p 
(89) 
which means that p divides d  r.
This with Relation (83) leads to
Hence the determinant of A as a matrix over
is equal to the determinant of A regarded as a matrix over
/p.
Therefore the computation of the determinant of A as a matrix over
can be done modulo p, which provides a control on the intermediate computations.
Now we have to answer the following questions:
 How to choose p?
 What do we win?
For choosing p we need an apriori bound for the determinant of A.
This is given by the following Hadamard's inequality.
Theorem 6
Let
B be the maximal absolute value of an entry of
A.
Then we have
 d  n^{n/2} B^{n} 
(91) 
Example 4
Consider
Gaussian elimination leads to
Hence
det(A) =  58.
The Hadamard's inequality gives
 det(A)  2^{1} 7^{2} = 98 
(94) 
The number p = 199 is prime and satisfies
p > 2×98.
Gaussian elimination
mod p leads to
So
det(A mod p) = 141 =  58 in
/199.
Let us study what is the cost of this approach.
Let us denote by C the determinant bound of Hadamard's inequality.
Assume that our machine words are Nbit long.
We make the following observations.
Therefore we have proved the following theorem
Theorem 7
The determinant of a square matrix with order
n, coefficients in
and
B as the maximal absolute value of a coefficient can be computed in
(
n^{3} n^{2} (log
n + log
B)
^{2}) word operations.
This is not in fact a big progress w.r.t. Gaussian elimination over
.
But this can be improved using a small primes modular computation
as follows.
Algorithm 5
Proof.
Recall that det(
A) is a polynomial expression in the coefficients of
A.
Hence by using the ring homomorphism between
and
/
m_{i}
for
i = 0
^{ ... }r  1 we have
det(A) d_{i}mod m_{i} 
(97) 
Using the ring isomorphism of Corollary
2
/m /m_{0}×^{ ... }×/m_{r1} 
(98) 
we deduce
det(A) d mod m 
(99) 
where
m is the product of the moduli
m_{0},...,
m_{r1}.
Now observe that
m 
= 
m_{0}^{ ... }m_{r1} 


2^{r} 


2 C + 1 


2 n^{n/2} B^{n} 


2  d  

(100) 
Hence actually we have
det(
A) =
d.
Example 5
Consider again
We choose the four primes 2, 3, 5, 7 so that m = 210.
We get
det(A) 0 mod 2 

det(A) 2 mod 3 
det(A) 2 mod 5 

det(A)  2 mod 7 

(102) 
The solutions of the system
d d_{i}mod m_{i}
for
1 i 4 are in
58 + 210 = {...,  268,  58, 152, 362,...} 
(103) 
Finally
det(A) =  58 again.
Based on this small primes modular computation approach
one could prove the following theorem
Theorem 8
The determinant of a square matrix with order
n, coefficients in
and
B as the maximal absolute value of a coefficient can be computed in
(
n^{4}log
^{2}(
n B)(log
^{2}n + log
^{2}B)) word operations.
Proof.
See Theorem 5.12 in [
vzGG99]
Remark 10
With Algorithm 5
we achieve the following goals.
 All intermediate computations can be made modulo small prime numbers.
In practice these small primes are machine integers
allowing fast computations.
 The only possible large value is the determinant itself.
 The space and the time required for the whole computation can be estimated
in advance.
Moreover the computations of the modular determinants (the d_{i}'s)
are pairwise independent and thus can be distributed.
Next: Bibliography
Up: Modular Algorithms and interpolation
Previous: The Chinese Remaindering Algorithm
Marc Moreno Maza
20030606