The question is Number of solutions to a1 x1+a2 x2+....+an xn=k with constraints: 1)ai>0 and ai<=15 2)n>0 and n<=15 3)xi>=0 I was able to formulate a Dynamic programming solution but it is running too long for n>10^10. Please guide me to get a more efficient soution.
The code
int dp[]=new int[16];
dp[0]=1;
BigInteger seen=new BigInteger("0");
while(true)
{
for(int i=0;i<arr[0];i++)
{
if(dp[0]==0)
break;
dp[arr[i+1]]=(dp[arr[i+1]]+dp[0])%1000000007;
}
for(int i=1;i<15;i++)
dp[i-1]=dp[i];
seen=seen.add(new BigInteger("1"));
if(seen.compareTo(n)==0)
break;
}
System.out.println(dp[0]);
arr is the array containing coefficients and answer should be mod 1000000007 as the number of ways donot fit into an int.
Update for real problem:
The actual problem is much simpler. However, it's hard to be helpful without spoiling it entirely.
Stripping it down to the bare essentials, the problem is
Given k distinct positive integers L1, ... , Lk and a nonnegative integer n, how many different finite sequences (a1, ..., ar) are there such that 1. for all i (1 <= i <= r), ai is one of the Lj, and 2. a1 + ... + ar = n. (In other words, the number of compositions of n using only the given Lj.)
For convenience, you are also told that all the Lj are <= 15 (and hence k <= 15), and n <= 10^18. And, so that the entire computation can be carried out using 64-bit integers (the number of sequences grows exponentially with n, you wouldn't have enough memory to store the exact number for large n), you should only calculate the remainder of the sequence count modulo 1000000007.
To solve such a problem, start by looking at the simplest cases first. The very simplest cases are when only one L is given, then evidently there is one admissible sequence if n is a multiple of L and no admissible sequence if n mod L != 0. That doesn't help yet. So consider the next simplest cases, two L values given. Suppose those are 1 and 2.
0 has one composition, the empty sequence: N(0) = 1
1 has one composition, (1): N(1) = 1
2 has two compositions, (1,1); (2): N(2) = 2
3 has three compositions, (1,1,1);(1,2);(2,1): N(3) = 3
4 has five compositions, (1,1,1,1);(1,1,2);(1,2,1);(2,1,1);(2,2): N(4) = 5
5 has eight compositions, (1,1,1,1,1);(1,1,1,2);(1,1,2,1);(1,2,1,1);(2,1,1,1);(1,2,2);(2,1,2);(2,2,1): N(5) = 8
You may see it now, or need a few more terms, but you'll notice that you get the Fibonacci sequence (shifted by one), N(n) = F(n+1), thus the sequence N(n) satisfies the recurrence relation
N(n) = N(n-1) + N(n-2) (for n >= 2; we have not yet proved that, so far it's a hypothesis based on pattern-spotting). Now, can we see that without calculating many values? Of course, there are two types of admissible sequences, those ending with 1 and those ending with 2. Since that partitioning of the admissible sequences restricts only the last element, the number of ad. seq. summing to n and ending with 1 is N(n-1) and the number of ad. seq. summing to n and ending with 2 is N(n-2).
That reasoning immediately generalises, given L1 < L2 < ... < Lk, for all n >= Lk, we have
N(n) = N(n-L1) + N(n-L2) + ... + N(n-Lk)
with the obvious interpretation if we're only interested in N(n) % m.
Umm, that linear recurrence still leaves calculating N(n) as an O(n) task?
Yes, but researching a few of the mentioned keywords quickly leads to an algorithm needing only O(log n) steps ;)
Algorithm for misinterpreted problem, no longer relevant, but may still be interesting:
The question looks a little SPOJish, so I won't give a complete algorithm (at least, not before I've googled around a bit to check if it's a contest question). I hope no restriction has been omitted in the description, such as that permutations of such representations should only contribute one to the count, that would considerably complicate the matter. So I count 1*3 + 2*4 = 11 and 2*4 + 1*3 = 11 as two different solutions.
Some notations first. For m-tuples of numbers, let < | > denote the canonical bilinear pairing, i.e.
<a|x> = a_1*x_1 + ... + a_m*x_m. For a positive integer B, let A_B = {1, 2, ..., B} be the set of positive integers not exceeding B. Let N denote the set of natural numbers, i.e. of nonnegative integers.
For 0 <= m, k and B > 0, let C(B,m,k) = card { (a,x) \in A_B^m × N^m : <a|x> = k }.
Your problem is then to find \sum_{m = 1}^15 C(15,m,k) (modulo 1000000007).
For completeness, let us mention that C(B,0,k) = if k == 0 then 1 else 0, which can be helpful in theoretical considerations. For the case of a positive number of summands, we easily find the recursion formula
C(B,m+1,k) = \sum_{j = 0}^k C(B,1,j) * C(B,m,k-j)
By induction, C(B,m,_) is the convolution¹ of m factors C(B,1,_). Calculating the convolution of two known functions up to k is O(k^2), so if C(B,1,_) is known, that gives an O(n*k^2) algorithm to compute C(B,m,k), 1 <= m <= n. Okay for small k, but our galaxy won't live to see you calculating C(15,15,10^18) that way. So, can we do better? Well, if you're familiar with the Laplace-transformation, you'll know that an analogous transformation will convert the convolution product to a pointwise product, which is much easier to calculate. However, although the transformation is in this case easy to compute, the inverse is not. Any other idea? Why, yes, let's take a closer look at C(B,1,_).
C(B,1,k) = card { a \in A_B : (k/a) is an integer }
In other words, C(B,1,k) is the number of divisors of k not exceeding B. Let us denote that by d_B(k). It is immediately clear that 1 <= d_B(k) <= B. For B = 2, evidently d_2(k) = 1 if k is odd, 2 if k is even. d_3(k) = 3 if and only if k is divisible by 2 and by 3, hence iff k is a multiple of 6, d_3(k) = 2 if and only if one of 2, 3 divides k but not the other, that is, iff k % 6 \in {2,3,4} and finally, d_3(k) = 1 iff neither 2 nor 3 divides k, i.e. iff gcd(k,6) = 1, iff k % 6 \in {1,5}. So we've seen that d_2 is periodic with period 2, d_3 is periodic with period 6. Generally, like reasoning shows that d_B is periodic for all B, and the minimal positive period divides B!.
Given any positive period P of C(B,1,_) = d_B, we can split the sum in the convolution (k = q*P+r, 0 <= r < P):
C(B,m+1, q*P+r) = \sum_{c = 0}^{q-1} (\sum_{j = 0}^{P-1} d_B(j)*C(B,m,(q-c)*P + (r-j)))
+ \sum_{j = 0}^r d_B(j)*C(B,m,r-j)
The functions C(B,m,_) are no longer periodic for m >= 2, but there are simple formulae to obtain C(B,m,q*P+r) from C(B,m,r). Thus, with C(B,1,_) = d_B and C(B,m,_) known up to P, calculating C(B,m+1,_) up to P is an O(P^2) task², getting the data necessary for calculating C(B,m+1,k) for arbitrarily large k, needs m such convolutions, hence that's O(m*P^2).
Then finding C(B,m,k) for 1 <= m <= n and arbitrarily large k is O(n^2*P^2), in time and O(n^2*P) in space.
For B = 15, we have 15! = 1.307674368 * 10^12, so using that for P isn't feasible. Fortunately, the smallest positive period of d_15 is much smaller, so you get something workable. From a rough estimate, I would still expect the calculation of C(15,15,k) to take time more appropriately measured in hours than seconds, but it's an improvement over O(k) which would take years (for k in the region of 10^18).
¹ The convolution used here is (f \ast g)(k) = \sum_{j = 0}^k f(j)*g(k-j).
² Assuming all arithmetic operations are O(1); if, as in the OP, only the residue modulo some M > 0 is desired, that holds if all intermediate calculations are done modulo M.
Related
Given natural number N (1 <= N <= 2000), count the number of sets of natural numbers with the sum equal to N, if we know that ratio of any two elements in given set is more than 2
(for any x, y in given set: max(x, y) / min(x, y) >= 2)
I am trying to use given ratio so it would be possible to count the sum using geometry progression formula, but I haven't succeeded yet. Somehow it's necessary to come up with dynamic programming solution, but I have no idea how to come up with a formula
As Stef suggested in the comments, if you count the number of ways you can make n, using numbers that are at most k, you can calculate this using dynamic programming. For a given n, k, either you use k or you don't: if you do, then you have n-k left, and can use numbers <= k/2, and if you don't, then you still have n, and can use numbers <= k-1. It's very similar to a coin change algorithm, or to a standard algorithm for counting partitions.
With that, here's a program that prints out the values up to n=2000 in the sequence:
N = 2000
A = [[0] * (i+1) for i in range(N+1)]
A[0][0] = 1
for n in range(1, N+1):
for k in range((n+1)//2, n+1):
A[n][k] = A[n-k][min(n-k, k//2)] + A[n][k-1]
for i in range(N+1):
print(i, A[i][i])
It has a couple of optimizations: A[n, k] is the same as A[n, n] for k>n, and A[n, k]=0 when 2k+1 < N (because if you use k, then the largest integer you can get is at most k+k/2+k/4+... <= 2k-1 -- the infinite sum is 2k, but with integer arithmetic you can never achieve this). These two optimizations give a speedup factor of 2 each, compared to computing the whole (n+1)x(n+1) table.
With these two optimizations, and the array-based bottom-up dynamic programming approach, this prints out all the solutions in around 0.5s on my machine.
I'm trying to solve pretty complex problem with divisors and number theory.
Namely for a given number m we can say that k is cool divisor if k<m k|m (k divides m evenly), and for a given number n the number k^n (k to the power of n) is not divisor of m. Let s(x) - number of cool divisors of x.
Now for given a and b we should find D = s(a) + s(a+1) + s(a+2) + s(a+3) + ... + s(a+b).
Limits for all values:
(1 <= a <= 10^6), (1 <= b <= 10^7), (2<=n<=10)
Example
Let's say a=32, b=1, n=3;
x = 32, n = 3 divisors of 32 are {1,2,4,8,16,32}. However only {4,8,16} fill the conditions so s(32) = 3
x = 33, n = 3 divisors of 33 are {1,3,11,33}. Only the numbers {3,11} fill the conditions so s(33)=2;
D = s(32) + s(33) = 3 + 2 = 5
What I have tried
We should answer all those questions for 100 test cases in 3 seconds time limit.
I have two ideas, the first one: I iterate in the interval [a, a+b] and for each value i in the range I check how many cool divisors are there for that value, we can check this in O(sqrt(N)) if the function for getting number of power of N is considered as O(1) so the total function for this is O(B*sqrt(B)).
The second one, I'm now sure if it will work and how fast it will be. First I do a precomputation, I have a for loop that iterates from 1 to N, where N = 10^7
and now in the range [2, N] for each number whose divisor is i, where i is in the range [2,N] and I check if i to the power of n is not divisor of j then we update that the number j has one more cool divisor. With this I think that the complexity will be O(NlogN) and for the answers O(B).
Your first idea works but you can improve it.
Instead of checking all numbers from 1 to sqrt(N) whether they are cool divisors, you can factorize N=*p0^q0*p1^q1*p2^q2...pk^qk*. Then the number of cool divisors should then be (q0+1)(q1+1)...(qk+1) - (q0/n+1)(q1/n+1)...(qk/n+1).
So you can first preprocess and find out all the prime numbers using some existing algo like Sieve of Eratosthenes and for each number N between [a,a+b] you do a factorization. The complexity should be roughly O(BlogB).
Your second idea works as well.
For each number i between [2,a+b], you can just check the multiples of i between [a,a+b] and see whether i is a cool divisor of those multiples. The complexity should be O(BlogB) as well. Some tricks can be played in this idea to speed up the program is that, once you don't need to use divide/mod operations from time to time to check whether i is a cool divisor. You can compute the first number m between [a, a+b] that i^n|m. This m should be m=ceiling(a/(i^n))(i^n). And then you know i^n|m+p*i does not hold for p between [1,i^(n-1) - 1] and holds for p=i^n-1. Basically, you know i is not a cool divisor every i^(n-1) multiples, and you do not need to use divide/mod to figure it out, which will speed the program up.
You are given N total number of item, P group in which you have to divide the N items.
Condition is the product of number of item held by each group should be max.
example N=10 and P=3 you can divide the 10 item in {3,4,3} since 3x3x4=36 max possible product.
You will want to form P groups of roughly N / P elements. However, this will not always be possible, as N might not be divisible by P, as is the case for your example.
So form groups of floor(N / P) elements initially. For your example, you'd form:
floor(10 / 3) = 3
=> groups = {3, 3, 3}
Now, take the remainder of the division of N by P:
10 mod 3 = 1
This means you have to distribute 1 more item to your groups (you can have up to P - 1 items left to distribute in general):
for i = 0 up to (N mod P) - 1:
groups[i]++
=> groups = {4, 3, 3} for your example
Which is also a valid solution.
For fun I worked out a proof of the fact that it in an optimal solution either all numbers = N/P or the numbers are some combination of floor(N/P) and ceiling(N/P). The proof is somewhat long, but proving optimality in a discrete context is seldom trivial. I would be interested if anybody can shorten the proof.
Lemma: For P = 2 the optimal way to divide N is into {N/2, N/2} if N is even and {floor(N/2), ceiling(N/2)} if N is odd.
This follows since the constraint that the two numbers sum to N means that the two numbers are of the form x, N-x.
The resulting product is (N-x)x = Nx - x^2. This is a parabola that opens down. Its max is at its vertex at x = N/2. If N is even this max is an integer. If N is odd, then x = N/2 is a fraction, but such parabolas are strictly unimodal, so the closer x gets to N/2 the larger the product. x = floor(N/2) (or ceiling, it doesn't matter by symmetry) is the closest an integer can get to N/2, hence {floor(N/2),ceiling(N/2)} is optimal for integers.
General case: First of all, a global max exists since there are only finitely many integer partitions and a finite list of numbers always has a max. Suppose that {x_1, x_2, ..., x_P} is globally optimal. Claim: given and i,j we have
|x_i - x_ j| <= 1
In other words: any two numbers in an optimal solution differ by at most 1. This follows immediately from the P = 2 lemma (applied to N = x_i + x_ j).
From this claim it follows that there are at most two distinct numbers among the x_i. If there is only 1 number, that number is clearly N/P. If there are two numbers, they are of the form a and a+1. Let k = the number of x_i which equal a+1, hence P-k of the x_i = a. Hence
(P-k)a + k(a+1) = N, where k is an integer with 1 <= k < P
But simple algebra yields that a = (N-k)/P = N/P - k/P.
Hence -- a is an integer < N/P which differs from N/P by less than 1 (k/P < 1)
Thus a = floor(N/P) and a+1 = ceiling(N/P).
QED
During an assignment, I was asked to show that a hash table of size m (m>3, m is prime) that is less than half full, and that uses quadratic checking (hash(k, i) = (h(k) + i^2) mod m) we will always find a free spot.
I've checked and arrived to the conclusion that the spots that will be found (when h(k)=0) are 0 mod m, 1 mod m, 4 mod m, 9 mod m, ...
My problem is that I can't figure a way to show that it will always find the free spot. I've tested it myself with different values of m, and also have proven myself that if the hash table is more than half full, we might never find a free spot.
Can anyone please hint me towards the way to solve this?
Thanks!
0, 1, 4, ..., ((m-1)/2)^2 are all distinct mod m. Why?
Suppose two numbers from that range, i^2 and j^2, are equivalent mod m.
Then i^2 - j^2 = (i-j)(i+j) = 0 (mod m). Since m is prime, m must divide one of those factors. But the factors are both less than m, so one of them ((i-j)) is 0. That is, i = j.
Since we are starting at 0, more than half the slots that are distinct. If you can only fill less than m/2 of them, at least one remains open.
Let's break the proof down.
Setup
First, some background.
With a hash table, we define a probe sequence P. For any item q, following P will eventually lead to the right item in the hash table. The probe sequence is just a series of functions {h_0, ..., h_M-1} where h_i is a hash function.
To insert an item q into the table, we look at h_0(q), h_1(q), and so on, until we find an empty spot. To find q later, we examine the same sequence of locations.
In general, the probe sequence is of the form h_i(q) = [h(q) + c(i)] mod M, for a hash table of size M, where M is a prime number. The function c(i) is the collision-resolution strategy, which must have two properties:
First, c(0) = 0. This means that the first probe in the sequence must be equal to just performing the hash.
Second, the values {c(0) mod M, ..., c(M-1) mod M} must contain every integer between 0 and M-1. This means that if you keep trying to find empty spots, the probe sequence will eventually probe every array position.
Applying quadratic probing
Okay, we've got the setup of how the hash table works. Let's look at quadratic probing. This just means that for our c(i) we're using a general quadratic equation of the form ai^2 + bi + c, though for most implementations you'll usually just see c(i) = i^2 (that is, b, c = 0).
Does quadratic probing meet the two properties we talked about before? Well, it's certainly true that c(0) = 0 here, since (0)^2 is indeed 0, so it meets the first property. What about the second property?
It turns out that in general, the answer is no.
Theorem. When quadratic probing is used in a hash table of size M, where M is a prime number, only the first floor[M/2] probes in the probe sequence are distinct.
Let's see why this is the case, using a proof by contradiction.
Say that the theorem is wrong. Then that means there are two values a and b such that 0 <= a < b < floor[M/2] that probe the same position.
h_a(q) and h_b(q) must probe the same position, by (1), so h_a(q) = h_b(q).
h_a(q) = h_b(q) ==> h(q) + c(a) = h(q) + c(b), mod M.
The h(q) on both sides cancel. Our c(i) is just c(i) = i^2, so we have a^2 = b^2.
Solving the quadratic equation in (4) gives us a^2 - b^2 = 0, mod M. This is a difference of two squares, so the solution is (a - b)(a + b) = 0, mod M.
But remember, we said M was a prime number. The only way that (a - b)(a + b) can be zero mod M is if [case I] (a - b) is zero, or [case II] (a + b) is zero mod M.
Case I can't be right, because we said that a != b, so a - b must be something other than zero.
The only way for (a + b) to be zero mod M is for a + b to be equal to be a multiple of M or zero. They clearly can't be zero, since they're both bigger than zero. And since they're both less than floor[M/2], their sum must be less than M. So case II can't be right either.
Thus, if the theorem were wrong, one of two quantities must be zero, neither of which can possibly be zero -- a contradiction! QED: quadratic probing doesn't satisfy property two once your table is more than half full and if your table size is a prime number. The proof is complete!
From Wikipedia:
For prime m > 2, most choices of c1 and c2 will make h(k,i) distinct for i in [0,(m − 1) / 2]. Such choices include c1 = c2 = 1/2, c1 = c2 = 1, and c1 = 0,c2 = 1. Because there are only about m/2 distinct probes for a given element, it is difficult to guarantee that insertions will succeed when the load factor is > 1/2.
See the quadratic probing section in Data Structures and Algorithms with Object-Oriented Design Patterns in C++ for a proof that m/2 elements are distinct when m is prime.
I have a series
S = i^(m) + i^(2m) + ............... + i^(km) (mod m)
0 <= i < m, k may be very large (up to 100,000,000), m <= 300000
I want to find the sum. I cannot apply the Geometric Progression (GP) formula because then result will have denominator and then I will have to find modular inverse which may not exist (if the denominator and m are not coprime).
So I made an alternate algorithm making an assumption that these powers will make a cycle of length much smaller than k (because it is a modular equation and so I would obtain something like 2,7,9,1,2,7,9,1....) and that cycle will repeat in the above series. So instead of iterating from 0 to k, I would just find the sum of numbers in a cycle and then calculate the number of cycles in the above series and multiply them. So I first found i^m (mod m) and then multiplied this number again and again taking modulo at each step until I reached the first element again.
But when I actually coded the algorithm, for some values of i, I got cycles which were of very large size. And hence took a large amount of time before terminating and hence my assumption is incorrect.
So is there any other pattern we can find out? (Basically I don't want to iterate over k.)
So please give me an idea of an efficient algorithm to find the sum.
This is the algorithm for a similar problem I encountered
You probably know that one can calculate the power of a number in logarithmic time. You can also do so for calculating the sum of the geometric series. Since it holds that
1 + a + a^2 + ... + a^(2*n+1) = (1 + a) * (1 + (a^2) + (a^2)^2 + ... + (a^2)^n),
you can recursively calculate the geometric series on the right hand to get the result.
This way you do not need division, so you can take the remainder of the sum (and of intermediate results) modulo any number you want.
As you've noted, doing the calculation for an arbitrary modulus m is difficult because many values might not have a multiplicative inverse mod m. However, if you can solve it for a carefully selected set of alternate moduli, you can combine them to obtain a solution mod m.
Factor m into p_1, p_2, p_3 ... p_n such that each p_i is a power of a distinct prime
Since each p is a distinct prime power, they are pairwise coprime. If we can calculate the sum of the series with respect to each modulus p_i, we can use the Chinese Remainder Theorem to reassemble them into a solution mod m.
For each prime power modulus, there are two trivial special cases:
If i^m is congruent to 0 mod p_i, the sum is trivially 0.
If i^m is congruent to 1 mod p_i, then the sum is congruent to k mod p_i.
For other values, one can apply the usual formula for the sum of a geometric sequence:
S = sum(j=0 to k, (i^m)^j) = ((i^m)^(k+1) - 1) / (i^m - 1)
TODO: Prove that (i^m - 1) is coprime to p_i or find an alternate solution for when they have a nontrivial GCD. Hopefully the fact that p_i is a prime power and also a divisor of m will be of some use... If p_i is a divisor of i. the condition holds. If p_i is prime (as opposed to a prime power), then either the special case i^m = 1 applies, or (i^m - 1) has a multiplicative inverse.
If the geometric sum formula isn't usable for some p_i, you could rearrange the calculation so you only need to iterate from 1 to p_i instead of 1 to k, taking advantage of the fact that the terms repeat with a period no longer than p_i.
(Since your series doesn't contain a j=0 term, the value you want is actually S-1.)
This yields a set of congruences mod p_i, which satisfy the requirements of the CRT.
The procedure for combining them into a solution mod m is described in the above link, so I won't repeat it here.
This can be done via the method of repeated squaring, which is O(log(k)) time, or O(log(k)log(m)) time, if you consider m a variable.
In general, a[n]=1+b+b^2+... b^(n-1) mod m can be computed by noting that:
a[j+k]==b^{j}a[k]+a[j]
a[2n]==(b^n+1)a[n]
The second just being the corollary for the first.
In your case, b=i^m can be computed in O(log m) time.
The following Python code implements this:
def geometric(n,b,m):
T=1
e=b%m
total = 0
while n>0:
if n&1==1:
total = (e*total + T)%m
T = ((e+1)*T)%m
e = (e*e)%m
n = n/2
//print '{} {} {}'.format(total,T,e)
return total
This bit of magic has a mathematical reason - the operation on pairs defined as
(a,r)#(b,s)=(ab,as+r)
is associative, and the rule 1 basically means that:
(b,1)#(b,1)#... n times ... #(b,1)=(b^n,1+b+b^2+...+b^(n-1))
Repeated squaring always works when operations are associative. In this case, the # operator is O(log(m)) time, so repeated squaring takes O(log(n)log(m)).
One way to look at this is that the matrix exponentiation:
[[b,1],[0,1]]^n == [[b^n,1+b+...+b^(n-1))],[0,1]]
You can use a similar method to compute (a^n-b^n)/(a-b) modulo m because matrix exponentiation gives:
[[b,1],[0,a]]^n == [[b^n,a^(n-1)+a^(n-2)b+...+ab^(n-2)+b^(n-1)],[0,a^n]]
Based on the approach of #braindoper a complete algorithm which calculates
1 + a + a^2 + ... +a^n mod m
looks like this in Mathematica:
geometricSeriesMod[a_, n_, m_] :=
Module[ {q = a, exp = n, factor = 1, sum = 0, temp},
While[And[exp > 0, q != 0],
If[EvenQ[exp],
temp = Mod[factor*PowerMod[q, exp, m], m];
sum = Mod[sum + temp, m];
exp--];
factor = Mod[Mod[1 + q, m]*factor, m];
q = Mod[q*q, m];
exp = Floor[ exp /2];
];
Return [Mod[sum + factor, m]]
]
Parameters:
a is the "ratio" of the series. It can be any integer (including zero and negative values).
n is the highest exponent of the series. Allowed are integers >= 0.
mis the integer modulus != 0
Note: The algorithm performs a Mod operation after every arithmetic operation. This is essential, if you transcribe this algorithm to a language with a limited word length for integers.